Transport Services (tsv)                                  K. De Schepper
Internet-Draft                                           Nokia Bell Labs
Intended status: Experimental                            B. Briscoe, Ed.
Expires: May 19, 2021                                        Independent
                                                       November 15, 2020


 Identifying Modified Explicit Congestion Notification (ECN) Semantics
                   for Ultra-Low Queuing Delay (L4S)
                     draft-ietf-tsvwg-ecn-l4s-id-12

Abstract

   This specification defines the identifier to be used on IP packets
   for a new network service called low latency, low loss and scalable
   throughput (L4S).  L4S uses an Explicit Congestion Notification (ECN)
   scheme that is similar to the original (or 'Classic') ECN approach.
   'Classic' ECN marking was required to be equivalent to a drop, both
   when applied in the network and when responded to by a transport.
   Unlike 'Classic' ECN marking, for packets carrying the L4S
   identifier, the network applies marking more immediately and more
   aggressively than drop, and the transport response to each mark is
   reduced and smoothed relative to that for drop.  The two changes
   counterbalance each other so that the throughput of an L4S flow will
   be roughly the same as a non-L4S flow under the same conditions.
   Nonetheless, the much more frequent control signals and the finer
   responses to them result in much more fine-grained adjustments, so
   that ultra-low and consistently low queuing delay (typically sub-
   millisecond on average) becomes possible for L4S traffic without
   compromising link utilization.  Thus even capacity-seeking (TCP-like)
   traffic can have high bandwidth and very low delay at the same time,
   even during periods of high traffic load.

   The L4S identifier defined in this document distinguishes L4S from
   'Classic' (e.g. TCP-Reno-friendly) traffic.  It gives an incremental
   migration path so that suitably modified network bottlenecks can
   distinguish and isolate existing traffic that still follows the
   Classic behaviour, to prevent it degrading the low queuing delay and
   low loss of L4S traffic.  This specification defines the rules that
   L4S transports and network elements need to follow to ensure they
   neither harm each other's performance nor that of Classic traffic.
   Examples of new active queue management (AQM) marking algorithms and
   examples of new transports (whether TCP-like or real-time) are
   specified separately.







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Status of This Memo

   This Internet-Draft is submitted in full conformance with the
   provisions of BCP 78 and BCP 79.

   Internet-Drafts are working documents of the Internet Engineering
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   This Internet-Draft will expire on May 19, 2021.

Copyright Notice

   Copyright (c) 2020 IETF Trust and the persons identified as the
   document authors.  All rights reserved.

   This document is subject to BCP 78 and the IETF Trust's Legal
   Provisions Relating to IETF Documents
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   publication of this document.  Please review these documents
   carefully, as they describe your rights and restrictions with respect
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   the Trust Legal Provisions and are provided without warranty as
   described in the Simplified BSD License.

Table of Contents

   1.  Introduction  . . . . . . . . . . . . . . . . . . . . . . . .   4
     1.1.  Latency, Loss and Scaling Problems  . . . . . . . . . . .   5
     1.2.  Terminology . . . . . . . . . . . . . . . . . . . . . . .   7
     1.3.  Scope . . . . . . . . . . . . . . . . . . . . . . . . . .   9
   2.  Consensus Choice of L4S Packet Identifier: Requirements . . .   9
   3.  L4S Packet Identification at Run-Time . . . . . . . . . . . .  10
   4.  Prerequisite Transport Layer Behaviour  . . . . . . . . . . .  11
     4.1.  Prerequisite Codepoint Setting  . . . . . . . . . . . . .  11
     4.2.  Prerequisite Transport Feedback . . . . . . . . . . . . .  11
     4.3.  Prerequisite Congestion Response  . . . . . . . . . . . .  12
     4.4.  Filtering or Smoothing of ECN Feedback  . . . . . . . . .  14
   5.  Prerequisite Network Node Behaviour . . . . . . . . . . . . .  15
     5.1.  Prerequisite Classification and Re-Marking Behaviour  . .  15
     5.2.  The Meaning of L4S CE Relative to Drop  . . . . . . . . .  16



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     5.3.  Exception for L4S Packet Identification by Network Nodes
           with Transport-Layer Awareness  . . . . . . . . . . . . .  17
     5.4.  Interaction of the L4S Identifier with other Identifiers   17
       5.4.1.  DualQ Examples of Other Identifiers Complementing L4S
               Identifiers . . . . . . . . . . . . . . . . . . . . .  17
         5.4.1.1.  Inclusion of Additional Traffic with L4S  . . . .  18
         5.4.1.2.  Exclusion of Traffic From L4S Treatment . . . . .  19
         5.4.1.3.  Generalized Combination of L4S and Other
                   Identifiers . . . . . . . . . . . . . . . . . . .  20
       5.4.2.  Per-Flow Queuing Examples of Other Identifiers
               Complementing L4S Identifiers . . . . . . . . . . . .  21
     5.5.  Limiting Packet Bursts from Links Supporting L4S AQMs . .  21
   6.  L4S Experiments . . . . . . . . . . . . . . . . . . . . . . .  22
     6.1.  Open Questions  . . . . . . . . . . . . . . . . . . . . .  22
     6.2.  Open Issues . . . . . . . . . . . . . . . . . . . . . . .  24
     6.3.  Future Potential  . . . . . . . . . . . . . . . . . . . .  24
   7.  IANA Considerations . . . . . . . . . . . . . . . . . . . . .  24
   8.  Security Considerations . . . . . . . . . . . . . . . . . . .  25
   9.  Acknowledgements  . . . . . . . . . . . . . . . . . . . . . .  25
   10. References  . . . . . . . . . . . . . . . . . . . . . . . . .  26
     10.1.  Normative References . . . . . . . . . . . . . . . . . .  26
     10.2.  Informative References . . . . . . . . . . . . . . . . .  26
   Appendix A.  The 'Prague L4S Requirements'  . . . . . . . . . . .  33
     A.1.  Requirements for Scalable Transport Protocols . . . . . .  34
       A.1.1.  Use of L4S Packet Identifier  . . . . . . . . . . . .  34
       A.1.2.  Accurate ECN Feedback . . . . . . . . . . . . . . . .  34
       A.1.3.  Fall back to Reno-friendly congestion control on
               packet loss . . . . . . . . . . . . . . . . . . . . .  35
       A.1.4.  Fall back to Reno-friendly congestion control on
               classic ECN bottlenecks . . . . . . . . . . . . . . .  36
       A.1.5.  Reduce RTT dependence . . . . . . . . . . . . . . . .  37
       A.1.6.  Scaling down to fractional congestion windows . . . .  37
       A.1.7.  Measuring Reordering Tolerance in Time Units  . . . .  38
     A.2.  Scalable Transport Protocol Optimizations . . . . . . . .  41
       A.2.1.  Setting ECT in TCP Control Packets and
               Retransmissions . . . . . . . . . . . . . . . . . . .  41
       A.2.2.  Faster than Additive Increase . . . . . . . . . . . .  41
       A.2.3.  Faster Convergence at Flow Start  . . . . . . . . . .  42
   Appendix B.  Alternative Identifiers  . . . . . . . . . . . . . .  42
     B.1.  ECT(1) and CE codepoints  . . . . . . . . . . . . . . . .  43
     B.2.  ECN-DualQ-SCE1  . . . . . . . . . . . . . . . . . . . . .  47
     B.3.  ECN-DualQ-SCE0  . . . . . . . . . . . . . . . . . . . . .  49
     B.4.  ECN Plus a Diffserv Codepoint (DSCP)  . . . . . . . . . .  51
     B.5.  ECN capability alone  . . . . . . . . . . . . . . . . . .  54
     B.6.  Protocol ID . . . . . . . . . . . . . . . . . . . . . . .  54
     B.7.  Source or destination addressing  . . . . . . . . . . . .  54
     B.8.  Summary: Merits of Alternative Identifiers  . . . . . . .  55
   Appendix C.  Potential Competing Uses for the ECT(1) Codepoint  .  56



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     C.1.  Integrity of Congestion Feedback  . . . . . . . . . . . .  56
     C.2.  Notification of Less Severe Congestion than CE  . . . . .  57
   Authors' Addresses  . . . . . . . . . . . . . . . . . . . . . . .  57

1.  Introduction

   This specification defines the identifier to be used on IP packets
   for a new network service called low latency, low loss and scalable
   throughput (L4S).  It is similar to the original (or 'Classic')
   Explicit Congestion Notification (ECN [RFC3168]).  RFC 3168 required
   an ECN mark to be equivalent to a drop, both when applied in the
   network and when responded to by a transport.  Unlike Classic ECN
   marking, the network applies L4S marking more immediately and more
   aggressively than drop, and the transport response to each mark is
   reduced and smoothed relative to that for drop.  The two changes
   counterbalance each other so that the throughput of an L4S flow will
   be roughly the same as a non-L4S flow under the same conditions.
   Nonetheless, the much more frequent control signals and the finer
   responses to them result in ultra-low queuing delay without
   compromising link utilization, and this low delay can be maintained
   during high load.  Ultra-low queuing delay means less than 1
   millisecond (ms) on average and less than about 2 ms at the 99th
   percentile.

   An example of a scalable congestion control that would enable the L4S
   service is Data Center TCP (DCTCP), which until now has been
   applicable solely to controlled environments like data centres
   [RFC8257], because it is too aggressive to co-exist with existing
   TCP-Reno-friendly traffic.  The DualQ Coupled AQM, which is defined
   in a complementary experimental specification
   [I-D.ietf-tsvwg-aqm-dualq-coupled], is an AQM framework that enables
   scalable congestion controls like DCTCP to co-exist with existing
   traffic, each getting roughly the same flow rate when they compete
   under similar conditions.  Note that a transport such as DCTCP is
   still not safe to deploy on the Internet unless it satisfies the
   requirements listed in Section 4.

   L4S is not only for elastic (TCP-like) traffic - there are scalable
   congestion controls for real-time media, such as the L4S variant of
   the SCReAM [RFC8298] real-time media congestion avoidance technique
   (RMCAT).  The factor that distinguishes L4S from Classic traffic is
   its behaviour in response to congestion.  The transport wire
   protocol, e.g. TCP, QUIC, SCTP, DCCP, RTP/RTCP, is orthogonal (and
   therefore not suitable for distinguishing L4S from Classic packets).

   The L4S identifier defined in this document is the key piece that
   distinguishes L4S from 'Classic' (e.g. Reno-friendly) traffic.  It
   gives an incremental migration path so that suitably modified network



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   bottlenecks can distinguish and isolate existing Classic traffic from
   L4S traffic to prevent it from degrading the ultra-low delay and loss
   of the new scalable transports, without harming Classic performance.
   Initial implementation of the separate parts of the system has been
   motivated by the performance benefits.

1.1.  Latency, Loss and Scaling Problems

   Latency is becoming the critical performance factor for many (most?)
   applications on the public Internet, e.g. interactive Web, Web
   services, voice, conversational video, interactive video, interactive
   remote presence, instant messaging, online gaming, remote desktop,
   cloud-based applications, and video-assisted remote control of
   machinery and industrial processes.  In the 'developed' world,
   further increases in access network bit-rate offer diminishing
   returns, whereas latency is still a multi-faceted problem.  In the
   last decade or so, much has been done to reduce propagation time by
   placing caches or servers closer to users.  However, queuing remains
   a major intermittent component of latency.

   The Diffserv architecture provides Expedited Forwarding [RFC3246], so
   that low latency traffic can jump the queue of other traffic.
   However, on access links dedicated to individual sites (homes, small
   enterprises or mobile devices), often all traffic at any one time
   will be latency-sensitive.  Then, given nothing to differentiate
   from, Diffserv makes no difference.  Instead, we need to remove the
   causes of any unnecessary delay.

   The bufferbloat project has shown that excessively-large buffering
   ('bufferbloat') has been introducing significantly more delay than
   the underlying propagation time.  These delays appear only
   intermittently--only when a capacity-seeking (e.g. TCP) flow is long
   enough for the queue to fill the buffer, making every packet in other
   flows sharing the buffer sit through the queue.

   Active queue management (AQM) was originally developed to solve this
   problem (and others).  Unlike Diffserv, which gives low latency to
   some traffic at the expense of others, AQM controls latency for _all_
   traffic in a class.  In general, AQM methods introduce an increasing
   level of discard from the buffer the longer the queue persists above
   a shallow threshold.  This gives sufficient signals to capacity-
   seeking (aka. greedy) flows to keep the buffer empty for its intended
   purpose: absorbing bursts.  However, RED [RFC2309] and other
   algorithms from the 1990s were sensitive to their configuration and
   hard to set correctly.  So, this form of AQM was not widely deployed.

   More recent state-of-the-art AQM methods, e.g. FQ-CoDel [RFC8290],
   PIE [RFC8033], Adaptive RED [ARED01], are easier to configure,



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   because they define the queuing threshold in time not bytes, so it is
   invariant for different link rates.  However, no matter how good the
   AQM, the sawtoothing sending window of a Classic congestion control
   will either cause queuing delay to vary or cause the link to be
   under-utilized.  Even with a perfectly tuned AQM, the additional
   queuing delay will be of the same order as the underlying speed-of-
   light delay across the network.

   If a sender's own behaviour is introducing queuing delay variation,
   no AQM in the network can 'un-vary' the delay without significantly
   compromising link utilization.  Even flow-queuing (e.g. [RFC8290]),
   which isolates one flow from another, cannot isolate a flow from the
   delay variations it inflicts on itself.  Therefore those applications
   that need to seek out high bandwidth but also need low latency will
   have to migrate to scalable congestion control.

   Altering host behaviour is not enough on its own though.  Even if
   hosts adopt low latency behaviour (scalable congestion controls),
   they need to be isolated from the behaviour of existing Classic
   congestion controls that induce large queue variations.  L4S enables
   that migration by providing latency isolation in the network and
   distinguishing the two types of packets that need to be isolated: L4S
   and Classic.  L4S isolation can be achieved with a queue per flow
   (e.g. [RFC8290]) but a DualQ [I-D.ietf-tsvwg-aqm-dualq-coupled] is
   sufficient, and actually gives better tail latency.  Both approaches
   are addressed in this document.

   The DualQ solution was developed to make ultra-low latency available
   without requiring per-flow queues at every bottleneck.  This was
   because FQ has well-known downsides - not least the need to inspect
   transport layer headers in the network, which makes it incompatible
   with privacy approaches such as IPSec VPN tunnels, and incompatible
   with link layer queue management, where transport layer headers can
   be hidden, e.g. 5G.

   Latency is not the only concern addressed by L4S: It was known when
   TCP congestion avoidance was first developed that it would not scale
   to high bandwidth-delay products (footnote 6 of Jacobson and Karels
   [TCP-CA]).  Given regular broadband bit-rates over WAN distances are
   already [RFC3649] beyond the scaling range of Reno TCP, 'less
   unscalable' Cubic [RFC8312] and Compound [I-D.sridharan-tcpm-ctcp]
   variants of TCP have been successfully deployed.  However, these are
   now approaching their scaling limits.  Unfortunately, fully scalable
   congestion controls such as DCTCP [RFC8257] cause Classic ECN
   congestion controls sharing the same queue to starve themselves,
   which is why they have been confined to private data centres or
   research testbeds (until now).




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   It turns out that a congestion control algorithm like DCTCP that
   solves the latency problem also solves the scalability problem of
   Classic congestion controls.  The finer sawteeth in the congestion
   window have low amplitude, so they cause very little queuing delay
   variation and the average time to recover from one congestion signal
   to the next (the average duration of each sawtooth) remains
   invariant, which maintains constant tight control as flow-rate
   scales.  A background paper [DCttH15] gives the full explanation of
   why the design solves both the latency and the scaling problems, both
   in plain English and in more precise mathematical form.  The
   explanation is summarised without the maths in the L4S architecture
   document [I-D.ietf-tsvwg-l4s-arch].

1.2.  Terminology

   The key words "MUST", "MUST NOT", "REQUIRED", "SHALL", "SHALL NOT",
   "SHOULD", "SHOULD NOT", "RECOMMENDED", "NOT RECOMMENDED", "MAY", and
   "OPTIONAL" in this document are to be interpreted as described in
   [RFC2119].  In this document, these words will appear with that
   interpretation only when in ALL CAPS.  Lower case uses of these words
   are not to be interpreted as carrying RFC-2119 significance.

   Classic Congestion Control:  A congestion control behaviour that can
      co-exist with standard TCP Reno [RFC5681] without causing
      significantly negative impact on its flow rate [RFC5033].  With
      Classic congestion controls, as flow rate scales, the number of
      round trips between congestion signals (losses or ECN marks) rises
      with the flow rate.  So it takes longer and longer to recover
      after each congestion event.  Therefore control of queuing and
      utilization becomes very slack, and the slightest disturbance
      prevents a high rate from being attained [RFC3649].

      For instance, with 1500 byte packets and an end-to-end round trip
      time (RTT) of 36 ms, over the years, as Reno flow rate scales from
      2 to 100 Mb/s the number of round trips taken to recover from a
      congestion event rises proportionately, from 4 round trips to 200.
      Cubic [RFC8312] was developed to be less unscalable, but it is
      approaching its scaling limit; with the same RTT of 36ms, at
      100Mb/s it takes about 106 round trips to recover, and at 800 Mb/s
      its recovery time triples to over 340 round trips, or still more
      than 12 seconds (Reno would take 57 seconds).  Cubic only becomes
      significantly better than Reno at high delay and rate
      combinations, for example at 90 ms RTT and 800 Mb/s a Reno flow
      takes 4000 RTTs or 6 minutes to recover, whereas Cubic 'only'
      needs 188 RTTs, which is still 17 seconds (double its recovery
      time at 100Mb/s).





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   Scalable Congestion Control:  A congestion control where the average
      time from one congestion signal to the next (the recovery time)
      remains invariant as the flow rate scales, all other factors being
      equal.  This maintains the same degree of control over queueing
      and utilization whatever the flow rate, as well as ensuring that
      high throughput is robust to disturbances.  For instance, DCTCP
      averages 2 congestion signals per round-trip whatever the flow
      rate, as do other recently developed scalable congestion controls,
      e.g. Relentless TCP [Mathis09], TCP Prague [PragueLinux] and the
      L4S variant of SCREAM for real-time media [RFC8298]).  See
      Section 4.3 for more explanation.

   Classic service:  The Classic service is intended for all the
      congestion control behaviours that co-exist with Reno [RFC5681]
      (e.g. Reno itself, Cubic [RFC8312], Compound
      [I-D.sridharan-tcpm-ctcp], TFRC [RFC5348]).  The term 'Classic
      queue' means a queue providing the Classic service.

   Low-Latency, Low-Loss Scalable throughput (L4S) service:  The 'L4S'
      service is intended for traffic from scalable congestion control
      algorithms, such as Data Center TCP [RFC8257].  The L4S service is
      for more general traffic than just DCTCP--it allows the set of
      congestion controls with similar scaling properties to DCTCP to
      evolve, such as the examples listed above (Relentless, Prague,
      SCReAM).  The term 'L4S queue' means a queue providing the L4S
      service.

      The terms Classic or L4S can also qualify other nouns, such as
      'queue', 'codepoint', 'identifier', 'classification', 'packet',
      'flow'.  For example: an L4S packet means a packet with an L4S
      identifier sent from an L4S congestion control.

      Both Classic and L4S services can cope with a proportion of
      unresponsive or less-responsive traffic as well, as long as it
      does not build a queue (e.g. DNS, VoIP, game sync datagrams, etc).

   Reno-friendly:  The subset of Classic traffic that excludes
      unresponsive traffic and excludes experimental congestion controls
      intended to coexist with Reno but without always being strictly
      friendly to Reno (as allowed by [RFC5033]).  Reno-friendly is used
      in place of 'TCP-friendly', given that the TCP protocol is used
      with many different congestion control behaviours.

   Classic ECN:  The original Explicit Congestion Notification (ECN)
      protocol [RFC3168], which requires ECN signals to be treated the
      same as drops, both when generated in the network and when
      responded to by the sender.  The names used for the four
      codepoints of the 2-bit IP-ECN field are as defined in [RFC3168]:



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      Not ECT, ECT(0), ECT(1) and CE, where ECT stands for ECN-Capable
      Transport and CE stands for Congestion Experienced.

1.3.  Scope

   The new L4S identifier defined in this specification is applicable
   for IPv4 and IPv6 packets (as for Classic ECN [RFC3168]).  It is
   applicable for the unicast, multicast and anycast forwarding modes.

   The L4S identifier is an orthogonal packet classification to the
   Differentiated Services Code Point (DSCP) [RFC2474].  Section 5.4
   explains what this means in practice.

   This document is intended for experimental status, so it does not
   update any standards track RFCs.  Therefore it depends on [RFC8311],
   which is a standards track specification that:

   o  updates the ECN proposed standard [RFC3168] to allow experimental
      track RFCs to relax the requirement that an ECN mark must be
      equivalent to a drop (when the network applies markings and/or
      when the sender responds to them);

   o  changes the status of the experimental ECN nonce [RFC3540] to
      historic;

   o  makes consequent updates to the following additional proposed
      standard RFCs to reflect the above two bullets:

      *  ECN for RTP [RFC6679];

      *  the congestion control specifications of various DCCP
         congestion control identifier (CCID) profiles [RFC4341],
         [RFC4342], [RFC5622].

   This document is about identifiers that are used for interoperation
   between hosts and networks.  So the audience is broad, covering
   developers of host transports and network AQMs, as well as covering
   how operators might wish to combine various identifiers, which would
   require flexibility from equipment developers.

2.  Consensus Choice of L4S Packet Identifier: Requirements

   This subsection briefly records the process that led to a consensus
   choice of L4S identifier, selected from all the alternatives in
   Appendix B.

   The identifier for packets using the Low Latency, Low Loss, Scalable
   throughput (L4S) service needs to meet the following requirements:



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   o  it SHOULD survive end-to-end between source and destination
      applications: across the boundary between host and network,
      between interconnected networks, and through middleboxes;

   o  it SHOULD be visible at the IP layer

   o  it SHOULD be common to IPv4 and IPv6 and transport-agnostic;

   o  it SHOULD be incrementally deployable;

   o  it SHOULD enable an AQM to classify packets encapsulated by outer
      IP or lower-layer headers;

   o  it SHOULD consume minimal extra codepoints;

   o  it SHOULD be consistent on all the packets of a transport layer
      flow, so that some packets of a flow are not served by a different
      queue to others.

   Whether the identifier would be recoverable if the experiment failed
   is a factor that could be taken into account.  However, this has not
   been made a requirement, because that would favour schemes that would
   be easier to fail, rather than those more likely to succeed.

   It is recognised that the chosen identifier is unlikely to satisfy
   all these requirements, particularly given the limited space left in
   the IP header.  Therefore a compromise will be necessary, which is
   why all the above requirements are expressed with the word 'SHOULD'
   not 'MUST'.  Appendix B discusses the pros and cons of the
   compromises made in various competing identification schemes against
   the above requirements.

   On the basis of this analysis, "ECT(1) and CE codepoints" is the best
   compromise.  Therefore this scheme is defined in detail in the
   following sections, while Appendix B records the rationale for this
   decision.

3.  L4S Packet Identification at Run-Time

   The L4S treatment is an experimental track alternative packet marking
   treatment [RFC4774] to the Classic ECN treatment in [RFC3168], which
   has been updated by [RFC8311] to allow experiments such as the one
   defined in the present specification.  Like Classic ECN, L4S ECN
   identifies both network and host behaviour: it identifies the marking
   treatment that network nodes are expected to apply to L4S packets,
   and it identifies packets that have been sent from hosts that are
   expected to comply with a broad type of sending behaviour.




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   For a packet to receive L4S treatment as it is forwarded, the sender
   sets the ECN field in the IP header to the ECT(1) codepoint.  See
   Section 4 for full transport layer behaviour requirements, including
   feedback and congestion response.

   A network node that implements the L4S service normally classifies
   arriving ECT(1) and CE packets for L4S treatment.  See Section 5 for
   full network element behaviour requirements, including
   classification, ECN-marking and interaction of the L4S identifier
   with other identifiers and per-hop behaviours.

4.  Prerequisite Transport Layer Behaviour

4.1.  Prerequisite Codepoint Setting

   A sender that wishes a packet to receive L4S treatment as it is
   forwarded, MUST set the ECN field in the IP header (v4 or v6) to the
   ECT(1) codepoint.

4.2.  Prerequisite Transport Feedback

   For a transport protocol to provide scalable congestion control it
   MUST provide feedback of the extent of CE marking on the forward
   path.  When ECN was added to TCP [RFC3168], the feedback method
   reported no more than one CE mark per round trip.  Some transport
   protocols derived from TCP mimic this behaviour while others report
   the accurate extent of ECN marking.  This means that some transport
   protocols will need to be updated as a prerequisite for scalable
   congestion control.  The position for a few well-known transport
   protocols is given below.

   TCP:  Support for the accurate ECN feedback requirements [RFC7560]
      (such as that provided by AccECN [I-D.ietf-tcpm-accurate-ecn]) by
      both ends is a prerequisite for scalable congestion control in
      TCP.  Therefore, the presence of ECT(1) in the IP headers even in
      one direction of a TCP connection will imply that both ends must
      be supporting accurate ECN feedback.  However, the converse does
      not apply.  So even if both ends support AccECN, either of the two
      ends can choose not to use a scalable congestion control, whatever
      the other end's choice.

   SCTP:  A suitable ECN feedback mechanism for SCTP could add a chunk
      to report the number of received CE marks
      (e.g. [I-D.stewart-tsvwg-sctpecn]), and update the ECN feedback
      protocol sketched out in Appendix A of the standards track
      specification of SCTP [RFC4960].





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   RTP over UDP:  A prerequisite for scalable congestion control is for
      both (all) ends of one media-level hop to signal ECN support
      [RFC6679] and use the new generic RTCP feedback format of
      [I-D.ietf-avtcore-cc-feedback-message].  The presence of ECT(1)
      implies that both (all) ends of that media-level hop support ECN.
      However, the converse does not apply.  So each end of a media-
      level hop can independently choose not to use a scalable
      congestion control, even if both ends support ECN.

   QUIC:  Support for sufficiently fine-grained ECN feedback is provided
      by the v1 IETF QUIC transport [I-D.ietf-quic-transport].

   DCCP:  The ACK vector in DCCP [RFC4340] is already sufficient to
      report the extent of CE marking as needed by a scalable congestion
      control.

4.3.  Prerequisite Congestion Response

   As a condition for a host to send packets with the L4S identifier
   (ECT(1)), it SHOULD implement a congestion control behaviour that
   ensures that, in steady state, the average time from one ECN
   congestion signal to the next (the 'recovery time') does not increase
   as flow rate scales, all other factors being equal.  This is termed a
   scalable congestion control.  This is necessary to ensure that queue
   variations remain small as flow rate scales, without having to
   sacrifice utilization.

   For instance, for DCTCP, TCP Prague [PragueLinux] and the L4S variant
   of SCReAM [RFC8298], the average recovery time is always half a round
   trip, whatever the flow rate.

   As with all transport behaviours, a detailed specification (probably
   an experimental RFC) will need to be defined for each congestion
   control, following the guidelines for specifying new congestion
   control algorithms in [RFC5033].  In addition it will need to
   document these L4S-specific matters, specifically the timescale over
   which the proportionality is averaged, and control of burstiness.
   The recovery time requirement above is worded as a 'SHOULD' rather
   than a 'MUST' to allow reasonable flexibility when defining these
   specifications.

   The condition 'all other factors being equal', allows the recovery
   time to be different for different round trip times, as long as it
   does not increase with flow rate for any particular RTT.

   Saying that the recovery time remains roughly invariant is equivalent
   to saying that the number of ECN CE marks per round trip remains
   invariant as flow rate scales, all other factors being equal.  For



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   instance, DCTCP's average recovery time of half of 1 RTT is
   equivalent to 2 ECN marks per round trip.  For those familiar with
   steady-state congestion response functions, it is also equivalent to
   say that the congestion window is inversely proportional to the
   proportion of bytes in packets marked with the CE codepoint (see
   section 2 of [PI2]).

   In order to coexist safely with other Internet traffic, a scalable
   congestion control MUST NOT tag its packets with the ECT(1) codepoint
   unless it complies with the following bulleted requirements.  The
   specification of a particular scalable congestion control MUST
   describe in detail how it satisfies each requirement and, for any
   non-mandatory requirements, it MUST justify why it does not comply:

   o  As well as responding to ECN markings, a scalable congestion
      control MUST react to packet loss in a way that will coexist
      safely with a TCP Reno congestion control [RFC5681] (see
      Appendix A.1.3 for rationale).

   o  A scalable congestion control MUST implement monitoring in order
      to detect a likely non-L4S but ECN-capable AQM at the bottleneck.
      On detection of a likely ECN-capable bottleneck it SHOULD be
      capable (dependent on configuration) of automatically adapting its
      congestion response to coexist with TCP Reno congestion controls
      [RFC5681] (see Appendix A.1.4 for rationale and a referenced
      algorithm).

      Note that a scalable congestion control is not expected to change
      to setting ECT(0) while it falls back to coexist with Reno.

   o  A scalable congestion control MUST eliminate RTT bias as much as
      possible in the range between the minimum likely RTT and typical
      RTTs expected in the intended deployment scenario (see
      Appendix A.1.5 for rationale).

   o  A scalable congestion control SHOULD remain responsive to
      congestion when typical RTTs over the public Internet are
      significantly smaller because they are no longer inflated by
      queuing delay (see Appendix A.1.6 for rationale).

   o  A scalable congestion control SHOULD detect loss by counting in
      time-based units, which is scalable, as opposed to counting in
      units of packets (as in the 3 DupACK rule of RFC 5681 TCP), which
      is not scalable.  As packet rates increase (e.g., due to new and/
      or improved technology), congestion controls that detect loss by
      counting in units of packets become more likely to incorrectly
      treat reordering events as congestion-caused loss events (see
      Appendix A.1.7 for further rationale).  This requirement does not



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      apply to congestion controls that are solely used in controlled
      environments where the network introduces hardly any reordering.

   o  A scalable congestion control is expected to limit the queue
      caused by bursts of packets.  It would not seem necessary to set
      the limit any lower than 10% of the minimum RTT expected in a
      typical deployment (e.g. additional queuing of roughly 250 us for
      the public Internet).  This would be converted to a number of
      packets under the worst-case assumption that the bottleneck link
      capacity equals the current flow rate.  No normative requirement
      to limit bursts is given here and, until there is more industry
      experience from the L4S experiment, it is not even known whether
      one is needed - it seems to be in an L4S sender's self-interest to
      limit bursts.  Instead, it is only required that the specification
      of a particular scalable congestion control MUST define, quantify
      and justify its approach to limiting bursts.

   To participate in the L4S experiment, a scalable congestion control
   MUST be capable of being replaced by a Classic congestion control (by
   application and by administrative control).  A purely Classic
   congestion control will not tag its packets with the ECT(1)
   codepoint.

   Each sender in a session can use a scalable congestion control
   independently of the congestion control used by the receiver(s) when
   they send data.  Therefore there might be ECT(1) packets in one
   direction and ECT(0) or Not-ECT in the other.

   Later (Section 5.4.1.1) this document discusses the conditions for
   mixing other "'Safe' Unresponsive Traffic" (e.g. DNS, LDAP, NTP,
   voice, game sync packets) with L4S traffic.  To be clear, although
   such traffic can share the same queue as L4S traffic, it is not
   appropriate for the sender to tag it as ECT(1), except in the
   (unlikely) case that it satisfies the above conditions.

4.4.  Filtering or Smoothing of ECN Feedback

   Section 5.2 below specifies that an L4S AQM is expected to signal L4S
   ECN without filtering or smoothing.  This contrasts with a Classic
   AQM, which filters out variations in the queue before signalling ECN
   marking or drop.  In the L4S architecture [I-D.ietf-tsvwg-l4s-arch],
   responsibility for smoothing out these variations shifts to the
   sender's congestion control.

   This shift of responsibility has the advantage that each sender can
   smooth variations over a timescale proportionate to its own RTT.
   Whereas, in the Classic approach, the network doesn't know the RTTs
   of all the flows, so it has to smooth out variations for a worst-case



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   RTT to ensure stability.  For all the typical flows with shorter RTT
   than the worst-case, this makes congestion control unnecessarily
   sluggish.

   This also gives an L4S sender the choice not to smooth, depending on
   its context (start-up, congestion avoidance, etc).  Therefore, this
   document places no requirement on an L4S congestion control to smooth
   out variations in any particular way.  Nonetheless, the specification
   of a particular L4S congestion control SHOULD describe how it smooths
   the L4S ECN signals fed back to it from the receiver.

5.  Prerequisite Network Node Behaviour

5.1.  Prerequisite Classification and Re-Marking Behaviour

   A network node that implements the L4S service MUST classify arriving
   ECT(1) packets for L4S treatment and, other than in the exceptional
   case referred to next, it MUST classify arriving CE packets for L4S
   treatment as well.  CE packets might have originated as ECT(1) or
   ECT(0), but the above rule to classify them as if they originated as
   ECT(1) is the safe choice (see Appendix B.1 for rationale).  The
   exception is where some flow-aware in-network mechanism happens to be
   available for distinguishing CE packets that originated as ECT(0), as
   described in Section 5.3, but there is no implication that such a
   mechanism is necessary.

   An L4S AQM treatment follows similar codepoint transition rules to
   those in RFC 3168.  Specifically, the ECT(1) codepoint MUST NOT be
   changed to any other codepoint than CE, and CE MUST NOT be changed to
   any other codepoint.  An ECT(1) packet is classified as ECN-capable
   and, if congestion increases, an L4S AQM algorithm will increasingly
   mark the ECN field as CE, otherwise forwarding packets unchanged as
   ECT(1).  Necessary conditions for an L4S marking treatment are
   defined in Section 5.2.

   Under persistent overload an L4S marking treatment MUST begin using
   Classic drop until the overload episode has subsided, as recommended
   for all AQM methods in [RFC7567] (Section 4.2.1), which follows the
   similar advice in RFC 3168 (Section 7).  Where an L4S AQM is
   transport-aware, this requirement could be satisfied by using Classic
   drop in only the most overloaded individual per-flow AQMs or in a
   DualQ by redirecting packets in those flows contributing most to the
   overload from the L4S queue so that they are subjected to drop in the
   Classic queue [I-D.briscoe-docsis-q-protection].

   For backward compatibility in uncontrolled environments, a network
   node that implements the L4S treatment MUST also implement an AQM
   treatment for the Classic service as defined in Section 1.2.  This



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   Classic AQM treatment need not mark ECT(0) packets, but if it does,
   it will do so under the same conditions as it would drop Not-ECT
   packets [RFC3168].  It MUST classify arriving ECT(0) and Not-ECT
   packets for treatment by this Classic AQM (for the DualQ Coupled AQM,
   see the extensive discussion on classification in Sections 2.3 and
   2.5.1.1 of [I-D.ietf-tsvwg-aqm-dualq-coupled]).

5.2.  The Meaning of L4S CE Relative to Drop

   The likelihood that an AQM drops a Not-ECT Classic packet (p_C) MUST
   be roughly proportional to the square of the likelihood that it would
   have marked it if it had been an L4S packet (p_L).  That is

      p_C ~= (p_L / k)^2

   The constant of proportionality (k) does not have to be standardised
   for interoperability, but a value of 2 is RECOMMENDED.  The term
   'likelihood' is used above to allow for marking and dropping to be
   either probabilistic or deterministic.

   This formula ensures that Scalable and Classic flows will converge to
   roughly equal congestion windows, for the worst case of Reno
   congestion control.  This is because the congestion windows of
   Scalable and Classic congestion controls are inversely proportional
   to p_L and sqrt(p_C) respectively.  So squaring p_C in the above
   formula counterbalances the square root that characterizes Reno-
   friendly flows.

   The relative strengths of L4S CE and drop are irrelevant in an AQM
   that schedules application flows explicitly (e.g. an FQ scheduler).
   Nonetheless, the above relationship defines the coupling between L4S
   and Classic congestion signals in a DualQ Coupled AQM
   [I-D.ietf-tsvwg-aqm-dualq-coupled].

   Note that, contrary to RFC 3168, a Dual Queue Coupled AQM
   implementing the L4S and Classic treatments does not mark an ECT(1)
   packet under the same conditions that it would have dropped a Not-ECT
   packet, as allowed by [RFC8311], which updates RFC 3168.  However, if
   it marks ECT(0) packets, it does so under the same conditions that it
   would have dropped a Not-ECT packet.

   Also, L4S CE marking needs to be interpreted as an unsmoothed signal,
   in contrast to the Classic approach in which AQMs filter out
   variations before signalling congestion.  An L4S AQM SHOULD NOT
   smooth or filter out variations in the queue before signalling
   congestion.  In the L4S architecture [I-D.ietf-tsvwg-l4s-arch], the
   sender, not the network, is responsible for smoothing out variations.




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   This requirement is worded as 'SHOULD NOT' rather than 'MUST NOT' to
   allow for the case where the signals from a Classic smoothed AQM are
   coupled with those from an unsmoothed L4S AQM.  Nonetheless, the
   spirit of the requirement is for all systems to expect that L4S ECN
   signalling is unsmoothed and unfiltered, which is important for
   interoperability.

5.3.  Exception for L4S Packet Identification by Network Nodes with
      Transport-Layer Awareness

   To implement the L4S treatment, a network node does not need to
   identify transport-layer flows.  Nonetheless, if an implementer is
   willing to identify transport-layer flows at a network node, and if
   the most recent ECT packet in the same flow was ECT(0), the node MAY
   classify CE packets for Classic ECN [RFC3168] treatment.  In all
   other cases, a network node MUST classify all CE packets for L4S
   treatment.  Examples of such other cases are: i) if no ECT packets
   have yet been identified in a flow; ii) if it is not desirable for a
   network node to identify transport-layer flows; or iii) if the most
   recent ECT packet in a flow was ECT(1).

   If an implementer uses flow-awareness to classify CE packets, to
   determine whether the flow is using ECT(0) or ECT(1) it only uses the
   most recent ECT packet of a flow (this advice will need to be
   verified as part of L4S experiments).  This is because a sender might
   switch from sending ECT(1) (L4S) packets to sending ECT(0) (Classic
   ECN) packets, or back again, in the middle of a transport-layer flow
   (e.g. it might manually switch its congestion control module mid-
   connection, or it might be deliberately attempting to confuse the
   network).

5.4.  Interaction of the L4S Identifier with other Identifiers

   The examples in this section concern how additional identifiers might
   complement the L4S identifier to classify packets between class-based
   queues.  Firstly Section 5.4.1 considers two queues, L4S and Classic,
   as in the Coupled DualQ AQM [I-D.ietf-tsvwg-aqm-dualq-coupled],
   either alone (Section 5.4.1.1) or within a larger queuing hierarchy
   (Section 5.4.1.2).  Then Section 5.4.2 considers schemes that might
   combine per-flow 5-tuples with other identifiers.

5.4.1.  DualQ Examples of Other Identifiers Complementing L4S
        Identifiers








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5.4.1.1.  Inclusion of Additional Traffic with L4S

   In a typical case for the public Internet a network element that
   implements L4S in a shared queue might want to classify some low-rate
   but unresponsive traffic (e.g. DNS, LDAP, NTP, voice, game sync
   packets) into the low latency queue to mix with L4S traffic.  Such
   non-ECN-based packet types MUST be safe to mix with L4S traffic
   without harming the low latency service, where 'safe' is explained in
   Section 5.4.1.1.1 below.

   In this case it would not be appropriate to call the queue an L4S
   queue, because it is shared by L4S and non-L4S traffic.  Instead it
   will be called the low latency or L queue.  The L queue then offers
   two different treatments:

   o  The L4S treatment, which is a combination of the L4S AQM treatment
      and a priority scheduling treatment;

   o  The low latency treatment, which is solely the priority scheduling
      treatment, without ECN-marking by the AQM.

   To identify packets for just the scheduling treatment, it would be
   inappropriate to use the L4S ECT(1) identifier, because such traffic
   is unresponsive to ECN marking.  Therefore, a network element that
   implements L4S in a shared queue MAY classify additional packets into
   the L queue if they carry certain non-ECN identifiers.  For instance:

   o  addresses of specific applications or hosts configured to be safe
      (or perhaps they comply with L4S behaviour and can respond to ECN
      feedback, but perhaps cannot set the ECN field for some reason);

   o  certain protocols that are usually lightweight (e.g. ARP, DNS);

   o  specific Diffserv codepoints that indicate traffic with limited
      burstiness such as the EF (Expedited Forwarding [RFC3246]), Voice-
      Admit [RFC5865] or proposed NQB (Non-Queue-Building
      [I-D.ietf-tsvwg-nqb]) service classes or equivalent local-use
      DSCPs (see [I-D.briscoe-tsvwg-l4s-diffserv]).

   Of course, a packet that carried both the ECT(1) codepoint and a non-
   ECN identifier associated with the L queue would be classified into
   the L queue.

   For clarity, non-ECN identifiers, such as the examples itemized
   above, might be used by some network operators who believe they
   identify non-L4S traffic that would be safe to mix with L4S traffic.
   They are not alternative ways for a host to indicate that it is
   sending L4S packets.  Only the ECT(1) ECN codepoint indicates to a



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   network element that a host is sending L4S packets (and CE indicates
   that it could have originated as ECT(1)).  Specifically ECT(1)
   indicates that the host claims its behaviour satisfies the
   prerequisite transport requirements in Section 4.

   To include additional traffic with L4S, a network element only reads
   identifiers such as those itemized above.  It MUST NOT alter these
   non-ECN identifiers, so that they survive for any potential use later
   on the network path.

5.4.1.1.1.  'Safe' Unresponsive Traffic

   The above section requires unresponsive traffic to be 'safe' to mix
   with L4S traffic.  Ideally this means that the sender never sends any
   sequence of packets at a rate that exceeds the available capacity of
   the bottleneck link.  However, typically an unresponsive transport
   does not even know the bottleneck capacity of the path, let alone its
   available capacity.  Nonetheless, an application can be considered
   safe enough if it paces packets out (not necessarily completely
   regularly) such that its maximum instantaneous rate from packet to
   packet stays well below a typical broadband access rate.

   This is a vague but useful definition, because many low latency
   applications of interest, such as DNS, voice, game sync packets, RPC,
   ACKs, keep-alives, could match this description.

5.4.1.2.  Exclusion of Traffic From L4S Treatment

   To extend the above example, an operator might want to exclude some
   traffic from the L4S treatment for a policy reason, e.g. security
   (traffic from malicious sources) or commercial (e.g. initially the
   operator may wish to confine the benefits of L4S to business
   customers).

   In this exclusion case, the operator MUST classify on the relevant
   locally-used identifiers (e.g. source addresses) before classifying
   the non-matching traffic on the end-to-end L4S ECN identifier.

   The operator MUST NOT alter the end-to-end L4S ECN identifier from
   L4S to Classic, because its decision to exclude certain traffic from
   L4S treatment is local-only.  The end-to-end L4S identifier then
   survives for other operators to use, or indeed, they can apply their
   own policy, independently based on their own choice of locally-used
   identifiers.  This approach also allows any operator to remove its
   locally-applied exclusions in future, e.g. if it wishes to widen the
   benefit of the L4S treatment to all its customers.





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5.4.1.3.  Generalized Combination of L4S and Other Identifiers

   L4S concerns low latency, which it can provide for all traffic
   without differentiation and without _necessarily_ affecting bandwidth
   allocation.  Diffserv provides for differentiation of both bandwidth
   and low latency, but its control of latency depends on its control of
   bandwidth.  The two can be combined if a network operator wants to
   control bandwidth allocation but it also wants to provide low latency
   - for any amount of traffic within one of these allocations of
   bandwidth (rather than only providing low latency by limiting
   bandwidth) [I-D.briscoe-tsvwg-l4s-diffserv].

   The DualQ examples so far have been framed in the context of
   providing the default Best Efforts Per-Hop Behaviour (PHB) using two
   queues - a Low Latency (L) queue and a Classic (C) Queue.  This
   single DualQ structure is expected to be the most common and useful
   arrangement.  But, more generally, an operator might choose to
   control bandwidth allocation through a hierarchy of Diffserv PHBs at
   a node, and to offer one (or more) of these PHBs with a low latency
   and a Classic variant.

   In the first case, if we assume that a network element provides no
   PHBs except the DualQ, if a packet carries ECT(1) or CE, the network
   element would classify it for the L4S treatment irrespective of its
   DSCP.  And, if a packet carried (say) the EF DSCP, the network
   element could classify it into the L queue irrespective of its ECN
   codepoint.  However, where the DualQ is in a hierarchy of other PHBs,
   the classifier would classify some traffic into other PHBs based on
   DSCP before classifying between the low latency and Classic queues
   (based on ECT(1), CE and perhaps also the EF DSCP or other
   identifiers as in the above example).
   [I-D.briscoe-tsvwg-l4s-diffserv] gives a number of examples of such
   arrangements to address various requirements.

   [I-D.briscoe-tsvwg-l4s-diffserv] describes how an operator might use
   L4S to offer low latency for all L4S traffic as well as using
   Diffserv for bandwidth differentiation.  It identifies two main types
   of approach, which can be combined: the operator might split certain
   Diffserv PHBs between L4S and a corresponding Classic service.  Or it
   might split the L4S and/or the Classic service into multiple Diffserv
   PHBs.  In either of these cases, a packet would have to be classified
   on its Diffserv and ECN codepoints.

   In summary, there are numerous ways in which the L4S ECN identifier
   (ECT(1) and CE) could be combined with other identifiers to achieve
   particular objectives.  The following categorization articulates
   those that are valid, but it is not necessarily exhaustive.  Those




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   tagged 'Recommended-standard-use' could be set by the sending host or
   a network.  Those tagged 'Local-use' would only be set by a network:

   1.  Identifiers Complementing the L4S Identifier

       A.  Including More Traffic in the L Queue
           (Could use Recommended-standard-use or Local-use identifiers)

       B.  Excluding Certain Traffic from the L Queue
           (Local-use only)

   2.  Identifiers to place L4S classification in a PHB Hierarchy
       (Could use Recommended-standard-use or Local-use identifiers)

       A.  PHBs Before L4S ECN Classification

       B.  PHBs After L4S ECN Classification

5.4.2.  Per-Flow Queuing Examples of Other Identifiers Complementing L4S
        Identifiers

   At a node with per-flow queueing (e.g. FQ-CoDel [RFC8290]), the L4S
   identifier could complement the Layer-4 flow ID as a further level of
   flow granularity (i.e.  Not-ECT and ECT(0) queued separately from
   ECT(1) and CE packets).  "Risk of reordering Classic CE packets" in
   Appendix B.1 discusses the resulting ambiguity if packets originally
   marked ECT(0) are marked CE by an upstream AQM before they arrive at
   a node that classifies CE as L4S.  It argues that the risk of
   reordering is vanishingly small and the consequence of such a low
   level of reordering is minimal.

   Alternatively, it could be assumed that it is not in a flow's own
   interest to mix Classic and L4S identifiers.  Then the AQM could use
   the ECN field to switch itself between a Classic and an L4S AQM
   behaviour within one per-flow queue.  For instance, for ECN-capable
   packets, the AQM might consist of a simple marking threshold and an
   L4S ECN identifier might simply select a shallower threshold than a
   Classic ECN identifier would.

5.5.  Limiting Packet Bursts from Links Supporting L4S AQMs

   As well as senders needing to limit packet bursts (Section 4.3),
   links need to limit the degree of burstiness they introduce.  In both
   cases (senders and links) this is a tradeoff, because batch-handling
   of packets is done for good reason, e.g. processing efficiency or to
   make efficient use of medium acquisition delay.  Some take the
   attitude that there is no point reducing burst delay at the sender
   below that introduced by links (or vice versa).  However, delay



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   reduction proceeds by cutting down 'the longest pole in the tent',
   which turns the spotlight on the next longest, and so on.

   This document does not set any quantified requirements for links to
   limit burst delay, primarily because link technologies are outside
   the remit of L4S specifications.  Nonetheless, it would not make
   sense to implement an L4S AQM that feeds into a particular link
   technology without also reviewing opportunities to reduce any form of
   burst delay introduced by that link technology.  This would at least
   limit the bursts that the link would otherwise introduce into the
   onward traffic, which would cause jumpy feedback to the sender as
   well as potential extra queuing delay downstream.  This document does
   not presume to even give guidance on an appropriate target for such
   burst delay until there is more industry experience of L4S.  However,
   as suggested in Section 4.3 it would not seem necessary to limit
   bursts lower than roughly 10% of the minimum base RTT expected in the
   typical deployment scenario (e.g. 250 us burst duration for links
   within the public Internet).

6.  L4S Experiments

   This section describes open questions that L4S Experiments ought to
   focus on.  This section also documents outstanding open issues that
   will need to be investigated as part of L4S experimentation, given
   they could not be fully resolved during the WG phase.  It also lists
   metrics that will need to be monitored during experiments
   (summarizing text elsewhere in L4S documents) and finally lists some
   potential future directions that researchers might wish to
   investigate.

   In addition to this section, [I-D.ietf-tsvwg-aqm-dualq-coupled] sets
   operational and management requirements for experiments with DualQ
   Coupled AQMs; and General operational and management requirements for
   experiments with L4S congestion controls are given in Section 4 and
   Section 5 above, e.g. co-existence and scaling requirements,
   incremental deployment arrangements.

   The specification of each scalable congestion control will need to
   include protocol-specific requirements for configuration and
   monitoring performance during experiments.  Appendix A of [RFC5706]
   provides a helpful checklist.

6.1.  Open Questions

   L4S experiments would be expected to answer the following questions:

   o  Have all the parts of L4S been deployed, and if so, what
      proportion of paths support it?



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   o  Does use of L4S over the Internet result in significantly improved
      user experience?

   o  Has L4S enabled novel interactive applications?

   o  Did use of L4S over the Internet result in improvements to the
      following metrics:

   o

      *  queue delay (mean and 99th percentile) under various loads

      *  utilization

      *  starvation / fairness

      *  scaling range of flow rates and RTTs

   o  How much does burstiness in the Internet affect L4S performance,
      and how much limitation of bustiness was needed and/or was
      realized - both at senders and at links, especially radio links?

   o  Was per-flow queue protection typically (un)necessary?

      *  How well did overload protection or queue protection work?

   o  How well did L4S flows coexist with Classic flows when sharing a
      bottleneck?

   o

      *  How frequently did problems arise?

      *  What caused any coexistence problems, and were any problems due
         to single-queue Classic ECN AQMs (this assumes single-queue
         Classic ECN AQMs can be distinguished from FQ ones)?

   o  How prevalent were problems with the L4S service due to tunnels /
      encapsulations that do not support ECN decapsulation?

   o  How easy was it to implement a fully compliant L4S congestion
      control, over various different transport protocols (TCP.  QUIC,
      RMCAT, etc)?

   Monitoring for harm to other traffic, specifically bandwidth
   starvation or excess queuing delay, will need to be conducted
   alongside all early L4S experiments.  It is hard, if not impossible,
   for an individual flow to measure its impact on other traffic.  So



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   such monitoring will need to be conducted using bespoke monitoring
   across flows and/or across classes of traffic.

6.2.  Open Issues

   o  What is the best way forward to deal with L4S over single-queue
      Classic ECN AQM bottlenecks, given current problems with
      misdetecting L4S AQMs as Classic ECN AQMs?

   o  Fixing the poor Interaction between current L4S congestion
      controls and CoDel with only Classic ECN support during flow
      startup

6.3.  Future Potential

   Researchers might find that L4S opens up the following interesting
   areas for investigation:

   o  Potential for faster convergence time and tracking of available
      capacity

   o  Potential for improvements to particular link technologies, and
      cross-layer interactions with them.

   o  Potential for using virtual queues, e.g. to further reduce latency
      jitter, or to leave headroom for capacity variation in radio
      networks

   o  Development and specification of reverse path congestion control
      using L4S building bocks (e.g. AccECN, QUIC)

   o  Once queuing delay is cut down, what becomes the 'second longest
      pole in the tent' (other than the speed of light)?

   o  Novel alternatives to the existing set of L4S AQMs

   o  Novel applications enabled by L4S

7.  IANA Considerations

   The 01 codepoint of the ECN Field of the IP header is specified by
   the present Experimental RFC.  The process for an experimental RFC to
   assign this codepoint in the IP header (v4 and v6) is documented in
   Proposed Standard [RFC8311], which updates the Proposed Standard
   [RFC3168].

   When the present document is published as an RFC, IANA is asked to
   update the 01 entry in the registry, "ECN Field (Bits 6-7)" to the



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   following (see https://www.iana.org/assignments/dscp-registry/dscp-
   registry.xhtml#ecn-field ):

   +--------+-----------------------------+----------------------------+
   | Binary | Keyword                     | References                 |
   +--------+-----------------------------+----------------------------+
   | 01     | ECT(1) (ECN-Capable         | [RFC8311]                  |
   |        | Transport(1))[1]            | [RFC Errata 5399]          |
   |        |                             | [RFCXXXX]                  |
   +--------+-----------------------------+----------------------------+

   [XXXX is the number that the RFC Editor assigns to the present
   document (this sentence to be removed by the RFC Editor)].

8.  Security Considerations

   Approaches to assure the integrity of signals using the new
   identifier are introduced in Appendix C.1.  See the security
   considerations in the L4S architecture [I-D.ietf-tsvwg-l4s-arch] for
   further discussion of mis-use of the identifier, as well as extensive
   discussion of policing rate and latency in regard to L4S.

   The recommendation to detect loss in time units prevents the ACK-
   splitting attacks described in [Savage-TCP].

9.  Acknowledgements

   Thanks to Richard Scheffenegger, John Leslie, David Taeht, Jonathan
   Morton, Gorry Fairhurst, Michael Welzl, Mikael Abrahamsson and Andrew
   McGregor for the discussions that led to this specification.  Ing-jyh
   (Inton) Tsang was a contributor to the early drafts of this document.
   And thanks to Mikael Abrahamsson, Lloyd Wood, Nicolas Kuhn, Greg
   White, Tom Henderson, David Black, Gorry Fairhurst, Brian Carpenter,
   Jake Holland, Rod Grimes and Richard Scheffenegger for providing help
   and reviewing this draft and to Ingemar Johansson for reviewing and
   providing substantial text.  Particular thanks to Wes Eddy for
   patiently shepherding this and the other L4S drafts through the IETF
   process.  Appendix A listing the Prague L4S Requirements is based on
   text authored by Marcelo Bagnulo Braun that was originally an
   appendix to [I-D.ietf-tsvwg-l4s-arch].  That text was in turn based
   on the collective output of the attendees listed in the minutes of a
   'bar BoF' on DCTCP Evolution during IETF-94 [TCPPrague].

   The authors' contributions were part-funded by the European Community
   under its Seventh Framework Programme through the Reducing Internet
   Transport Latency (RITE) project (ICT-317700).  Bob Briscoe was also
   funded partly by the Research Council of Norway through the TimeIn




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   project, partly by CableLabs and partly by the Comcast Innovation
   Fund.  The views expressed here are solely those of the authors.

10.  References

10.1.  Normative References

   [RFC2119]  Bradner, S., "Key words for use in RFCs to Indicate
              Requirement Levels", BCP 14, RFC 2119,
              DOI 10.17487/RFC2119, March 1997,
              <https://www.rfc-editor.org/info/rfc2119>.

   [RFC3168]  Ramakrishnan, K., Floyd, S., and D. Black, "The Addition
              of Explicit Congestion Notification (ECN) to IP",
              RFC 3168, DOI 10.17487/RFC3168, September 2001,
              <https://www.rfc-editor.org/info/rfc3168>.

   [RFC4774]  Floyd, S., "Specifying Alternate Semantics for the
              Explicit Congestion Notification (ECN) Field", BCP 124,
              RFC 4774, DOI 10.17487/RFC4774, November 2006,
              <https://www.rfc-editor.org/info/rfc4774>.

   [RFC6679]  Westerlund, M., Johansson, I., Perkins, C., O'Hanlon, P.,
              and K. Carlberg, "Explicit Congestion Notification (ECN)
              for RTP over UDP", RFC 6679, DOI 10.17487/RFC6679, August
              2012, <https://www.rfc-editor.org/info/rfc6679>.

10.2.  Informative References

   [A2DTCP]   Zhang, T., Wang, J., Huang, J., Huang, Y., Chen, J., and
              Y. Pan, "Adaptive-Acceleration Data Center TCP", IEEE
              Transactions on Computers 64(6):1522-1533, June 2015,
              <http://ieeexplore.ieee.org/xpl/
              articleDetails.jsp?arnumber=6871352>.

   [Ahmed19]  Ahmed, A., "Extending TCP for Low Round Trip Delay",
              Masters Thesis, Uni Oslo , August 2019,
              <https://www.duo.uio.no/handle/10852/70966>.

   [Alizadeh-stability]
              Alizadeh, M., Javanmard, A., and B. Prabhakar, "Analysis
              of DCTCP: Stability, Convergence, and Fairness", ACM
              SIGMETRICS 2011 , June 2011.

   [ARED01]   Floyd, S., Gummadi, R., and S. Shenker, "Adaptive RED: An
              Algorithm for Increasing the Robustness of RED's Active
              Queue Management", ACIRI Technical Report , August 2001,
              <http://www.icir.org/floyd/red.html>.



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   [DCttH15]  De Schepper, K., Bondarenko, O., Briscoe, B., and I.
              Tsang, "'Data Centre to the Home': Ultra-Low Latency for
              All", RITE Project Technical Report , 2015,
              <http://riteproject.eu/publications/>.

   [ecn-fallback]
              Briscoe, B. and A. Ahmed, "TCP Prague Fall-back on
              Detection of a Classic ECN AQM", bobbriscoe.net Technical
              Report TR-BB-2019-002, April 2020,
              <https://arxiv.org/abs/1911.00710>.

   [I-D.briscoe-docsis-q-protection]
              Briscoe, B. and G. White, "Queue Protection to Preserve
              Low Latency", draft-briscoe-docsis-q-protection-00 (work
              in progress), July 2019.

   [I-D.briscoe-tsvwg-l4s-diffserv]
              Briscoe, B., "Interactions between Low Latency, Low Loss,
              Scalable Throughput (L4S) and Differentiated Services",
              draft-briscoe-tsvwg-l4s-diffserv-02 (work in progress),
              November 2018.

   [I-D.ietf-avtcore-cc-feedback-message]
              Sarker, Z., Perkins, C., Singh, V., and M. Ramalho, "RTP
              Control Protocol (RTCP) Feedback for Congestion Control",
              draft-ietf-avtcore-cc-feedback-message-09 (work in
              progress), November 2020.

   [I-D.ietf-quic-transport]
              Iyengar, J. and M. Thomson, "QUIC: A UDP-Based Multiplexed
              and Secure Transport", draft-ietf-quic-transport-32 (work
              in progress), October 2020.

   [I-D.ietf-tcpm-accurate-ecn]
              Briscoe, B., Kuehlewind, M., and R. Scheffenegger, "More
              Accurate ECN Feedback in TCP", draft-ietf-tcpm-accurate-
              ecn-13 (work in progress), November 2020.

   [I-D.ietf-tcpm-generalized-ecn]
              Bagnulo, M. and B. Briscoe, "ECN++: Adding Explicit
              Congestion Notification (ECN) to TCP Control Packets",
              draft-ietf-tcpm-generalized-ecn-06 (work in progress),
              October 2020.

   [I-D.ietf-tcpm-rack]
              Cheng, Y., Cardwell, N., Dukkipati, N., and P. Jha, "The
              RACK-TLP loss detection algorithm for TCP", draft-ietf-
              tcpm-rack-13 (work in progress), November 2020.



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   [I-D.ietf-tsvwg-aqm-dualq-coupled]
              Schepper, K., Briscoe, B., and G. White, "DualQ Coupled
              AQMs for Low Latency, Low Loss and Scalable Throughput
              (L4S)", draft-ietf-tsvwg-aqm-dualq-coupled-12 (work in
              progress), July 2020.

   [I-D.ietf-tsvwg-ecn-encap-guidelines]
              Briscoe, B., Kaippallimalil, J., and P. Thaler,
              "Guidelines for Adding Congestion Notification to
              Protocols that Encapsulate IP", draft-ietf-tsvwg-ecn-
              encap-guidelines-13 (work in progress), May 2019.

   [I-D.ietf-tsvwg-l4s-arch]
              Briscoe, B., Schepper, K., Bagnulo, M., and G. White, "Low
              Latency, Low Loss, Scalable Throughput (L4S) Internet
              Service: Architecture", draft-ietf-tsvwg-l4s-arch-07 (work
              in progress), October 2020.

   [I-D.ietf-tsvwg-nqb]
              White, G. and T. Fossati, "A Non-Queue-Building Per-Hop
              Behavior (NQB PHB) for Differentiated Services", draft-
              ietf-tsvwg-nqb-03 (work in progress), November 2020.

   [I-D.ietf-tsvwg-rfc6040update-shim]
              Briscoe, B., "Propagating Explicit Congestion Notification
              Across IP Tunnel Headers Separated by a Shim", draft-ietf-
              tsvwg-rfc6040update-shim-10 (work in progress), March
              2020.

   [I-D.morton-tsvwg-sce]
              Morton, J., Heist, P., and R. Grimes, "The Some Congestion
              Experienced ECN Codepoint", draft-morton-tsvwg-sce-02
              (work in progress), November 2020.

   [I-D.sridharan-tcpm-ctcp]
              Sridharan, M., Tan, K., Bansal, D., and D. Thaler,
              "Compound TCP: A New TCP Congestion Control for High-Speed
              and Long Distance Networks", draft-sridharan-tcpm-ctcp-02
              (work in progress), November 2008.

   [I-D.stewart-tsvwg-sctpecn]
              Stewart, R., Tuexen, M., and X. Dong, "ECN for Stream
              Control Transmission Protocol (SCTP)", draft-stewart-
              tsvwg-sctpecn-05 (work in progress), January 2014.







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   [LinuxPacedChirping]
              Misund, J. and B. Briscoe, "Paced Chirping - Rethinking
              TCP start-up", Proc. Linux Netdev 0x13 , March 2019,
              <https://www.netdevconf.org/0x13/session.html?talk-chirp>.

   [Mathis09]
              Mathis, M., "Relentless Congestion Control", PFLDNeT'09 ,
              May 2009, <http://www.hpcc.jp/pfldnet2009/
              Program_files/1569198525.pdf>.

   [Paced-Chirping]
              Misund, J., "Rapid Acceleration in TCP Prague", Masters
              Thesis , May 2018,
              <https://riteproject.files.wordpress.com/2018/07/
              misundjoakimmastersthesissubmitted180515.pdf>.

   [PI2]      De Schepper, K., Bondarenko, O., Tsang, I., and B.
              Briscoe, "PI^2 : A Linearized AQM for both Classic and
              Scalable TCP", Proc. ACM CoNEXT 2016 pp.105-119, December
              2016,
              <http://dl.acm.org/citation.cfm?doid=2999572.2999578>.

   [PragueLinux]
              Briscoe, B., De Schepper, K., Albisser, O., Misund, J.,
              Tilmans, O., Kuehlewind, M., and A. Ahmed, "Implementing
              the `TCP Prague' Requirements for Low Latency Low Loss
              Scalable Throughput (L4S)", Proc. Linux Netdev 0x13 ,
              March 2019, <https://www.netdevconf.org/0x13/
              session.html?talk-tcp-prague-l4s>.

   [QV]       Briscoe, B. and P. Hurtig, "Up to Speed with Queue View",
              RITE Technical Report D2.3; Appendix C.2, August 2015,
              <https://riteproject.files.wordpress.com/2015/12/rite-
              deliverable-2-3.pdf>.

   [RFC2309]  Braden, B., Clark, D., Crowcroft, J., Davie, B., Deering,
              S., Estrin, D., Floyd, S., Jacobson, V., Minshall, G.,
              Partridge, C., Peterson, L., Ramakrishnan, K., Shenker,
              S., Wroclawski, J., and L. Zhang, "Recommendations on
              Queue Management and Congestion Avoidance in the
              Internet", RFC 2309, DOI 10.17487/RFC2309, April 1998,
              <https://www.rfc-editor.org/info/rfc2309>.

   [RFC2474]  Nichols, K., Blake, S., Baker, F., and D. Black,
              "Definition of the Differentiated Services Field (DS
              Field) in the IPv4 and IPv6 Headers", RFC 2474,
              DOI 10.17487/RFC2474, December 1998,
              <https://www.rfc-editor.org/info/rfc2474>.



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   [RFC2983]  Black, D., "Differentiated Services and Tunnels",
              RFC 2983, DOI 10.17487/RFC2983, October 2000,
              <https://www.rfc-editor.org/info/rfc2983>.

   [RFC3246]  Davie, B., Charny, A., Bennet, J., Benson, K., Le Boudec,
              J., Courtney, W., Davari, S., Firoiu, V., and D.
              Stiliadis, "An Expedited Forwarding PHB (Per-Hop
              Behavior)", RFC 3246, DOI 10.17487/RFC3246, March 2002,
              <https://www.rfc-editor.org/info/rfc3246>.

   [RFC3540]  Spring, N., Wetherall, D., and D. Ely, "Robust Explicit
              Congestion Notification (ECN) Signaling with Nonces",
              RFC 3540, DOI 10.17487/RFC3540, June 2003,
              <https://www.rfc-editor.org/info/rfc3540>.

   [RFC3649]  Floyd, S., "HighSpeed TCP for Large Congestion Windows",
              RFC 3649, DOI 10.17487/RFC3649, December 2003,
              <https://www.rfc-editor.org/info/rfc3649>.

   [RFC4340]  Kohler, E., Handley, M., and S. Floyd, "Datagram
              Congestion Control Protocol (DCCP)", RFC 4340,
              DOI 10.17487/RFC4340, March 2006,
              <https://www.rfc-editor.org/info/rfc4340>.

   [RFC4341]  Floyd, S. and E. Kohler, "Profile for Datagram Congestion
              Control Protocol (DCCP) Congestion Control ID 2: TCP-like
              Congestion Control", RFC 4341, DOI 10.17487/RFC4341, March
              2006, <https://www.rfc-editor.org/info/rfc4341>.

   [RFC4342]  Floyd, S., Kohler, E., and J. Padhye, "Profile for
              Datagram Congestion Control Protocol (DCCP) Congestion
              Control ID 3: TCP-Friendly Rate Control (TFRC)", RFC 4342,
              DOI 10.17487/RFC4342, March 2006,
              <https://www.rfc-editor.org/info/rfc4342>.

   [RFC4960]  Stewart, R., Ed., "Stream Control Transmission Protocol",
              RFC 4960, DOI 10.17487/RFC4960, September 2007,
              <https://www.rfc-editor.org/info/rfc4960>.

   [RFC5033]  Floyd, S. and M. Allman, "Specifying New Congestion
              Control Algorithms", BCP 133, RFC 5033,
              DOI 10.17487/RFC5033, August 2007,
              <https://www.rfc-editor.org/info/rfc5033>.

   [RFC5348]  Floyd, S., Handley, M., Padhye, J., and J. Widmer, "TCP
              Friendly Rate Control (TFRC): Protocol Specification",
              RFC 5348, DOI 10.17487/RFC5348, September 2008,
              <https://www.rfc-editor.org/info/rfc5348>.



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   [RFC5562]  Kuzmanovic, A., Mondal, A., Floyd, S., and K.
              Ramakrishnan, "Adding Explicit Congestion Notification
              (ECN) Capability to TCP's SYN/ACK Packets", RFC 5562,
              DOI 10.17487/RFC5562, June 2009,
              <https://www.rfc-editor.org/info/rfc5562>.

   [RFC5622]  Floyd, S. and E. Kohler, "Profile for Datagram Congestion
              Control Protocol (DCCP) Congestion ID 4: TCP-Friendly Rate
              Control for Small Packets (TFRC-SP)", RFC 5622,
              DOI 10.17487/RFC5622, August 2009,
              <https://www.rfc-editor.org/info/rfc5622>.

   [RFC5681]  Allman, M., Paxson, V., and E. Blanton, "TCP Congestion
              Control", RFC 5681, DOI 10.17487/RFC5681, September 2009,
              <https://www.rfc-editor.org/info/rfc5681>.

   [RFC5706]  Harrington, D., "Guidelines for Considering Operations and
              Management of New Protocols and Protocol Extensions",
              RFC 5706, DOI 10.17487/RFC5706, November 2009,
              <https://www.rfc-editor.org/info/rfc5706>.

   [RFC5865]  Baker, F., Polk, J., and M. Dolly, "A Differentiated
              Services Code Point (DSCP) for Capacity-Admitted Traffic",
              RFC 5865, DOI 10.17487/RFC5865, May 2010,
              <https://www.rfc-editor.org/info/rfc5865>.

   [RFC5925]  Touch, J., Mankin, A., and R. Bonica, "The TCP
              Authentication Option", RFC 5925, DOI 10.17487/RFC5925,
              June 2010, <https://www.rfc-editor.org/info/rfc5925>.

   [RFC6040]  Briscoe, B., "Tunnelling of Explicit Congestion
              Notification", RFC 6040, DOI 10.17487/RFC6040, November
              2010, <https://www.rfc-editor.org/info/rfc6040>.

   [RFC6077]  Papadimitriou, D., Ed., Welzl, M., Scharf, M., and B.
              Briscoe, "Open Research Issues in Internet Congestion
              Control", RFC 6077, DOI 10.17487/RFC6077, February 2011,
              <https://www.rfc-editor.org/info/rfc6077>.

   [RFC6660]  Briscoe, B., Moncaster, T., and M. Menth, "Encoding Three
              Pre-Congestion Notification (PCN) States in the IP Header
              Using a Single Diffserv Codepoint (DSCP)", RFC 6660,
              DOI 10.17487/RFC6660, July 2012,
              <https://www.rfc-editor.org/info/rfc6660>.







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   [RFC7560]  Kuehlewind, M., Ed., Scheffenegger, R., and B. Briscoe,
              "Problem Statement and Requirements for Increased Accuracy
              in Explicit Congestion Notification (ECN) Feedback",
              RFC 7560, DOI 10.17487/RFC7560, August 2015,
              <https://www.rfc-editor.org/info/rfc7560>.

   [RFC7567]  Baker, F., Ed. and G. Fairhurst, Ed., "IETF
              Recommendations Regarding Active Queue Management",
              BCP 197, RFC 7567, DOI 10.17487/RFC7567, July 2015,
              <https://www.rfc-editor.org/info/rfc7567>.

   [RFC7713]  Mathis, M. and B. Briscoe, "Congestion Exposure (ConEx)
              Concepts, Abstract Mechanism, and Requirements", RFC 7713,
              DOI 10.17487/RFC7713, December 2015,
              <https://www.rfc-editor.org/info/rfc7713>.

   [RFC8033]  Pan, R., Natarajan, P., Baker, F., and G. White,
              "Proportional Integral Controller Enhanced (PIE): A
              Lightweight Control Scheme to Address the Bufferbloat
              Problem", RFC 8033, DOI 10.17487/RFC8033, February 2017,
              <https://www.rfc-editor.org/info/rfc8033>.

   [RFC8257]  Bensley, S., Thaler, D., Balasubramanian, P., Eggert, L.,
              and G. Judd, "Data Center TCP (DCTCP): TCP Congestion
              Control for Data Centers", RFC 8257, DOI 10.17487/RFC8257,
              October 2017, <https://www.rfc-editor.org/info/rfc8257>.

   [RFC8290]  Hoeiland-Joergensen, T., McKenney, P., Taht, D., Gettys,
              J., and E. Dumazet, "The Flow Queue CoDel Packet Scheduler
              and Active Queue Management Algorithm", RFC 8290,
              DOI 10.17487/RFC8290, January 2018,
              <https://www.rfc-editor.org/info/rfc8290>.

   [RFC8298]  Johansson, I. and Z. Sarker, "Self-Clocked Rate Adaptation
              for Multimedia", RFC 8298, DOI 10.17487/RFC8298, December
              2017, <https://www.rfc-editor.org/info/rfc8298>.

   [RFC8311]  Black, D., "Relaxing Restrictions on Explicit Congestion
              Notification (ECN) Experimentation", RFC 8311,
              DOI 10.17487/RFC8311, January 2018,
              <https://www.rfc-editor.org/info/rfc8311>.

   [RFC8312]  Rhee, I., Xu, L., Ha, S., Zimmermann, A., Eggert, L., and
              R. Scheffenegger, "CUBIC for Fast Long-Distance Networks",
              RFC 8312, DOI 10.17487/RFC8312, February 2018,
              <https://www.rfc-editor.org/info/rfc8312>.





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   [RFC8511]  Khademi, N., Welzl, M., Armitage, G., and G. Fairhurst,
              "TCP Alternative Backoff with ECN (ABE)", RFC 8511,
              DOI 10.17487/RFC8511, December 2018,
              <https://www.rfc-editor.org/info/rfc8511>.

   [Savage-TCP]
              Savage, S., Cardwell, N., Wetherall, D., and T. Anderson,
              "TCP Congestion Control with a Misbehaving Receiver", ACM
              SIGCOMM Computer Communication Review 29(5):71--78,
              October 1999.

   [sub-mss-prob]
              Briscoe, B. and K. De Schepper, "Scaling TCP's Congestion
              Window for Small Round Trip Times", BT Technical Report
              TR-TUB8-2015-002, May 2015,
              <https://arxiv.org/abs/1904.07598>.

   [TCP-CA]   Jacobson, V. and M. Karels, "Congestion Avoidance and
              Control", Laurence Berkeley Labs Technical Report ,
              November 1988, <http://ee.lbl.gov/papers/congavoid.pdf>.

   [TCPPrague]
              Briscoe, B., "Notes: DCTCP evolution 'bar BoF': Tue 21 Jul
              2015, 17:40, Prague", tcpprague mailing list archive ,
              July 2015, <https://www.ietf.org/mail-
              archive/web/tcpprague/current/msg00001.html>.

   [VCP]      Xia, Y., Subramanian, L., Stoica, I., and S. Kalyanaraman,
              "One more bit is enough", Proc. SIGCOMM'05, ACM CCR
              35(4)37--48, 2005,
              <http://doi.acm.org/10.1145/1080091.1080098>.

Appendix A.  The 'Prague L4S Requirements'

   This appendix is informative, not normative.  It gives a list of
   modifications to current scalable congestion controls so that they
   can be deployed over the public Internet and coexist safely with
   existing traffic.  The list complements the normative requirements in
   Section 4 that a sender has to comply with before it can set the L4S
   identifier in packets it sends into the Internet.  As well as
   necessary safety improvements (requirements) this appendix also
   includes preferable performance improvements (optimizations).

   These recommendations have become know as the Prague L4S
   Requirements, because they were originally identified at an ad hoc
   meeting during IETF-94 in Prague [TCPPrague].  They were originally
   called the 'TCP Prague Requirements', but they are not solely
   applicable to TCP, so the name and wording has been generalized for



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   all transport protocols, and the name 'TCP Prague' is now used for a
   specific implementation of the requirements.

   At the time of writing, DCTCP [RFC8257] is the most widely used
   scalable transport protocol.  In its current form, DCTCP is specified
   to be deployable only in controlled environments.  Deploying it in
   the public Internet would lead to a number of issues, both from the
   safety and the performance perspective.  The modifications and
   additional mechanisms listed in this section will be necessary for
   its deployment over the global Internet.  Where an example is needed,
   DCTCP is used as a base, but it is likely that most of these
   requirements equally apply to other scalable congestion controls,
   covering adaptive real-time media, etc., not just capacity-seeking
   behaviours.

A.1.  Requirements for Scalable Transport Protocols

A.1.1.  Use of L4S Packet Identifier

   Description: A scalable congestion control needs to distinguish the
   packets it sends from those sent by Classic congestion controls (see
   the precise normative requirement wording in Section 4.1).

   Motivation: It needs to be possible for a network node to classify
   L4S packets without flow state into a queue that applies an L4S ECN
   marking behaviour and isolates L4S packets from the queuing delay of
   Classic packets.

A.1.2.  Accurate ECN Feedback

   Description: The transport protocol for a scalable congestion control
   needs to provide timely, accurate feedback about the extent of ECN
   marking experienced by all packets (see the precise normative
   requirement wording in Section 4.2).

   Motivation: Classic congestion controls only need feedback about the
   existence of a congestion episode within a round trip, not precisely
   how many packets were marked with ECN or dropped.  Therefore, in
   2001, when ECN feedback was added to TCP [RFC3168], it could not
   inform the sender of more than one ECN mark per RTT.  Since then,
   requirements for more accurate ECN feedback in TCP have been defined
   in [RFC7560] and [I-D.ietf-tcpm-accurate-ecn] specifies an
   experimental change to the TCP wire protocol to satisfy these
   requirements.  Most other transport protocols already satisfy this
   requirement (see Section 4.2).






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A.1.3.  Fall back to Reno-friendly congestion control on packet loss

   Description: As well as responding to ECN markings in a scalable way,
   a scalable congestion control needs to react to packet loss in a way
   that will coexist safely with a TCP Reno congestion control [RFC5681]
   (see the precise normative requirement wording in Section 4.3).

   Motivation: Part of the safety conditions for deploying a scalable
   congestion control on the public Internet is to make sure that it
   behaves properly when it builds a queue at a network bottleneck that
   has not been upgraded to support L4S.  Packet loss can have many
   causes, but it usually has to be conservatively assumed that it is a
   sign of congestion.  Therefore, on detecting packet loss, a scalable
   congestion control will need to fall back to Classic congestion
   control behaviour.  If it does not comply with this requirement it
   could starve Classic traffic.

   A scalable congestion control can be used for different types of
   transport, e.g. for real-time media or for reliable transport like
   TCP.  Therefore, the particular Classic congestion control behaviour
   to fall back on will need to be part of the congestion control
   specification of the relevant transport.  In the particular case of
   DCTCP, the DCTCP specification [RFC8257] states that "It is
   RECOMMENDED that an implementation deal with loss episodes in the
   same way as conventional TCP."  For safe deployment of a scalable
   congestion control in the public Internet, the above requirement
   would need to be defined as a "MUST".

   Even though a bottleneck is L4S capable, it might still become
   overloaded and have to drop packets.  In this case, the sender may
   receive a high proportion of packets marked with the CE bit set and
   also experience loss.  Current DCTCP implementations each react
   differently to this situation.  At least one implementation reacts
   only to the drop signal (e.g. by halving the CWND) and at least
   another DCTCP implementation reacts to both signals (e.g. by halving
   the CWND due to the drop and also further reducing the CWND based on
   the proportion of marked packet).  A third approach for the public
   Internet has been proposed that adjusts the loss response to result
   in a halving when combined with the ECN response.  We believe that
   further experimentation is needed to understand what is the best
   behaviour for the public Internet, which may or not be one of these
   existing approaches.









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A.1.4.  Fall back to Reno-friendly congestion control on classic ECN
        bottlenecks

   Description: A scalable congestion control needs to react to ECN
   marking from a non-L4S, but ECN-capable, bottleneck in a way that
   will coexist with a TCP Reno congestion control [RFC5681] (see the
   precise normative requirement wording in Section 4.3).

   Motivation: Similarly to the requirement in Appendix A.1.3, this
   requirement is a safety condition to ensure a scalable congestion
   control behaves properly when it builds a queue at a network
   bottleneck that has not been upgraded to support L4S.  On detecting
   Classic ECN marking (see below), a scalable congestion control will
   need to fall back to Classic congestion control behaviour.  If it
   does not comply with this requirement it could starve Classic
   traffic.

   A passive monitoring algorithm to detect a Classic ECN AQM at the
   bottleneck is provided in [ecn-fallback], which also provides a link
   to Linux source code.  Very briefly, the algorithm primarily monitors
   RTT variation using the same algorithm that maintains the mean
   deviation of TCP's smoothed RTT, but it smooths over a duration of
   the order of a Classic sawtooth.  The outcome is also conditioned on
   other metrics such as the presence of CE marking and congestion
   avoidance phase having stabilized.  The report also identifies
   further work to improve the approach, for instance improvements with
   low capacity links and combining the measurements with a cache of
   what had been learned about a path in previous connections.

   The relevant normative requirement (Section 4.3) is expressed as a
   'SHOULD' to allow the possibility that the operator of the host knows
   that the network it serves has not deployed any single queue classic
   ECN AQM (e.g. a CDN might be testing out of band for signs of Classic
   ECN AQMs, or they might have manually checked which ISPs they serve
   have not deployed Classic ECN AQMs).

   Nonetheless, monitoring is still expressed as a 'MUST' because there
   is still a possibility that there is a Classic ECN AQM somewhere else
   on the path (to continue the CDN example, perhaps beyond the ISP in a
   home network).  Then, if the server operators have disabled fall-back
   for parts of their deployment, they can reconsider their policy or at
   least do more focused testing if in-band monitoring frequently
   detects single-queue Classic ECN AQMs.








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A.1.5.  Reduce RTT dependence

   Description: A scalable congestion control needs to reduce or
   eliminate RTT bias at least over the low to typical range of RTTs
   that will interact in the intended deployment scenario (see the
   precise normative requirement wording in Section 4.3).

   Motivation: The throughput of Classic congestion controls is known to
   be inversely proportional to RTT, so one would expect flows over very
   low RTT paths to nearly starve flows over larger RTTs.  However,
   Classic congestion controls have never allowed a very low RTT path to
   exist because they induce a large queue.  For instance, consider two
   paths with base RTT 1ms and 100ms.  If a Classic congestion control
   induces a 100ms queue, it turns these RTTs into 101ms and 200ms
   leading to a throughput ratio of about 2:1.  Whereas if a scalable
   congestion control induces only a 1ms queue, the ratio is 2:101,
   leading to a throughput ratio of about 50:1.

   Therefore, with very small queues, long RTT flows will essentially
   starve, unless scalable congestion controls comply with this
   requirement.

   The RTT bias in current Classic congestion controls works
   satisfactorily when the RTT is higher than typical, and L4S does not
   change that.  So, there is no additional requirement for high RTT L4S
   flows to remove RTT bias - they can but they don't have to.

A.1.6.  Scaling down to fractional congestion windows

   Description: A scalable congestion control needs to remain responsive
   to congestion when typical RTTs over the public Internet are
   significantly smaller because they are no longer inflated by queuing
   delay (see the precise normative requirement wording in Section 4.3).

   Motivation: As currently specified, the minimum required congestion
   window of TCP (and its derivatives) is set to 2 sender maximum
   segment sizes (SMSS) (see equation (4) in [RFC5681]).  Once the
   congestion window reaches this minimum, all known window-based
   congestion control algorithms become unresponsive to congestion
   signals.  No matter how much drop or ECN marking, the congestion
   window of all these algorithms no longer reduces.  Instead, the
   sender's lack of any further congestion response forces the queue to
   grow, overriding any AQM and increasing queuing delay.

   L4S mechanisms significantly reduce queueing delay so, over the same
   path, the RTT becomes lower.  Then this problem becomes surprisingly
   common [sub-mss-prob].  This is because, for the same link capacity,
   smaller RTT implies a smaller window.  For instance, consider a



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   residential setting with an upstream broadband Internet access of 8
   Mb/s, assuming a max segment size of 1500 B.  Two upstream flows will
   each have the minimum window of 2 SMSS if the RTT is 6ms or less,
   which is quite common when accessing a nearby data centre.  So, any
   more than two such parallel TCP flows will become unresponsive and
   increase queuing delay.

   Unless scalable congestion controls address this requirement from the
   start, they will frequently become unresponsive, negating the low
   latency benefit of L4S, for themselves and for others.

   That would seem to imply that scalable congestion controllers ought
   to be required to be able work with a congestion window less than 2
   SMSS.  For instance, one possible mechanism that can maintain a
   congestion window significantly less than 1 SMSS is described in
   [Ahmed19], and other approaches are likely to be feasible.

   However, the requirement in Section 4.3 is worded as a "SHOULD"
   because the existence of a minimum window is not all bad.  When
   competing with an unresponsive flow, a minimum window naturally
   protects the flow from starvation by at least keeping some data
   flowing.

   By stating this requirement as a "SHOULD", specifications of scalable
   congestion controllers will be able to choose an appropriate minimum
   window, but they will at least have to justify the decision.

A.1.7.  Measuring Reordering Tolerance in Time Units

   Description: A scalable congestion control needs to detect loss by
   counting in time-based units, which is scalable, rather than counting
   in units of packets, which is not (see the precise normative
   requirement wording in Section 4.3).

   Motivation: A primary purpose of L4S is scalable throughput (it's in
   the name).  Scalability in all dimensions is, of course, also a goal
   of all IETF technology.  The inverse linear congestion response in
   Section 4.3 is necessary, but not sufficient, to solve the congestion
   control scalability problem identified in [RFC3649].  As well as
   maintaining frequent ECN signals as rate scales, it is also important
   to ensure that a potentially false perception of loss does not limit
   throughput scaling.

   End-systems cannot know whether a missing packet is due to loss or
   reordering, except in hindsight - if it appears later.  So they can
   only deem that there has been a loss if a gap in the sequence space
   has not been filled, either after a certain number of subsequent
   packets has arrived (e.g. the 3 DupACK rule of standard TCP



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   congestion control [RFC5681]) or after a certain amount of time
   (e.g. the RACK approach [I-D.ietf-tcpm-rack]).

   As we attempt to scale packet rate over the years:

   o  Even if only _some_ sending hosts still deem that loss has
      occurred by counting reordered packets, _all_ networks will have
      to keep reducing the time over which they keep packets in order.
      If some link technologies keep the time within which reordering
      occurs roughly unchanged, then loss over these links, as perceived
      by these hosts, will appear to continually rise over the years.

   o  In contrast, if all senders detect loss in units of time, the time
      over which the network has to keep packets in order stays roughly
      invariant.

   Therefore hosts have an incentive to detect loss in time units (so as
   not to fool themselves too often into detecting losses when there are
   none).  And for hosts that are changing their congestion control
   implementation to L4S, there is no downside to including time-based
   loss detection code in the change (loss recovery implemented in
   hardware is an exception, covered later).  Therefore requiring L4S
   hosts to detect loss in time-based units would not be a burden.

   If this requirement is not placed on L4S hosts, even though it would
   be no burden on them to do so, all networks will face unnecessary
   uncertainty over whether some L4S hosts might be detecting loss by
   counting packets.  Then _all_ link technologies will have to
   unnecessarily keep reducing the time within which reordering occurs.
   That is not a problem for some link technologies, but it becomes
   increasingly challenging for other link technologies to continue to
   scale, particularly those relying on channel bonding for scaling,
   such as LTE, 5G and DOCSIS.

   Given Internet paths traverse many link technologies, any scaling
   limit for these more challenging access link technologies would
   become a scaling limit for the Internet as a whole.

   It might be asked how it helps to place this loss detection
   requirement only on L4S hosts, because networks will still face
   uncertainty over whether non-L4S flows are detecting loss by counting
   DupACKs.  The answer is that those link technologies for which it is
   challenging to keep squeezing the reordering time will only need to
   do so for non-L4S traffic (which they can do because the L4S
   identifier is visible at the IP layer).  Therefore, they can focus
   their processing and memory resources into scaling non-L4S (Classic)
   traffic.  Then, the higher the proportion of L4S traffic, the less of
   a scaling challenge they will have.



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   To summarize, there is no reason for L4S hosts not to be part of the
   solution instead of part of the problem.

   Requirement ("MUST") or recommendation ("SHOULD")?  As explained
   above, this is a subtle interoperability issue between hosts and
   networks, which seems to need a "MUST".  Unless networks can be
   certain that all L4S hosts follow the time-based approach, they still
   have to cater for the worst case - continually squeeze reordering
   into a smaller and smaller duration - just for hosts that might be
   using the counting approach.  However, it was decided to express this
   as a recommendation, using "SHOULD".  The main justification was that
   networks can still be fairly certain that L4S hosts will follow this
   recommendation, because following it offers only gain and no pain.

   Details:

   The speed of loss recovery is much more significant for short flows
   than long, therefore a good compromise is to adapt the reordering
   window; from a small fraction of the RTT at the start of a flow, to a
   larger fraction of the RTT for flows that continue for many round
   trips.

   This is broadly the approach adopted by TCP RACK (Recent
   ACKnowledgements) [I-D.ietf-tcpm-rack].  However, RACK starts with
   the 3 DupACK approach, because the RTT estimate is not necessarily
   stable.  As long as the initial window is paced, such initial use of
   3 DupACK counting would amount to time-based loss detection and
   therefore would satisfy the time-based loss detection recommendation
   of Section 4.3.  This is because pacing of the initial window would
   ensure that 3 DupACKs early in the connection would be spread over a
   small fraction of the round trip.

   As mentioned above, hardware implementations of loss recovery using
   DupACK counting exist (e.g. some implementations of RoCEv2 for RDMA).
   For low latency, these implementations can change their congestion
   control to implement L4S, because the congestion control (as distinct
   from loss recovery) is implemented in software.  But they cannot
   easily satisfy this loss recovery requirement.  However, it is
   believed they do not need to.  It is believed that such
   implementations solely exist in controlled environments, where the
   network technology keeps reordering extremely low anyway.  This is
   why controlled environments with hardly any reordering are excluded
   from the scope of the normative recommendation in Section 4.3.

   Detecting loss in time units also prevents the ACK-splitting attacks
   described in [Savage-TCP].





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A.2.  Scalable Transport Protocol Optimizations

A.2.1.  Setting ECT in TCP Control Packets and Retransmissions

   Description: This item only concerns TCP and its derivatives
   (e.g. SCTP), because the original specification of ECN for TCP
   precluded the use of ECN on control packets and retransmissions.  To
   improve performance, scalable transport protocols ought to enable ECN
   at the IP layer in TCP control packets (SYN, SYN-ACK, pure ACKs,
   etc.) and in retransmitted packets.  The same is true for derivatives
   of TCP, e.g. SCTP.

   Motivation: RFC 3168 prohibits the use of ECN on these types of TCP
   packet, based on a number of arguments.  This means these packets are
   not protected from congestion loss by ECN, which considerably harms
   performance, particularly for short flows.
   [I-D.ietf-tcpm-generalized-ecn] counters each argument in RFC 3168 in
   turn, showing it was over-cautious.  Instead it proposes experimental
   use of ECN on all types of TCP packet as long as AccECN feedback
   [I-D.ietf-tcpm-accurate-ecn] is available (which is itself a
   prerequisite for using a scalable congestion control).

A.2.2.  Faster than Additive Increase

   Description: It would improve performance if scalable congestion
   controls did not limit their congestion window increase to the
   standard additive increase of 1 SMSS per round trip [RFC5681] during
   congestion avoidance.  The same is true for derivatives of TCP
   congestion control, including similar approaches used for real-time
   media.

   Motivation: As currently defined [RFC8257], DCTCP uses the
   traditional TCP Reno additive increase in congestion avoidance phase.
   When the available capacity suddenly increases (e.g. when another
   flow finishes, or if radio capacity increases) it can take very many
   round trips to take advantage of the new capacity.  TCP Cubic was
   designed to solve this problem, but as flow rates have continued to
   increase, the delay accelerating into available capacity has become
   prohibitive.  See, for instance, the examples in Section 1.2.  Even
   when out of its Reno-compatibility mode, every 8x scaling of Cubic's
   flow rate leads to 2x more acceleration delay.

   In the steady state, DCTCP induces about 2 ECN marks per round trip,
   so it is possible to quickly detect when these signals have
   disappeared and seek available capacity more rapidly, while
   minimizing the impact on other flows (Classic and scalable)
   [LinuxPacedChirping].  Alternatively, approaches such as Adaptive
   Acceleration (A2DTCP [A2DTCP]) have been proposed to address this



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   problem in data centres, which might be deployable over the public
   Internet.

A.2.3.  Faster Convergence at Flow Start

   Description: Particularly when a flow starts, scalable congestion
   controls need to converge (reach their steady-state share of the
   capacity) at least as fast as Classic congestion controls and
   preferably faster.  This affects the flow start behaviour of any L4S
   congestion control derived from a Classic transport that uses TCP
   slow start, including those for real-time media.

   Motivation: As an example, a new DCTCP flow takes longer than a
   Classic congestion control to obtain its share of the capacity of the
   bottleneck when there are already ongoing flows using the bottleneck
   capacity.  In a data centre environment DCTCP takes about a factor of
   1.5 to 2 longer to converge due to the much higher typical level of
   ECN marking that DCTCP background traffic induces, which causes new
   flows to exit slow start early [Alizadeh-stability].  In testing for
   use over the public Internet the convergence time of DCTCP relative
   to a regular loss-based TCP slow start is even less favourable
   [Paced-Chirping] due to the shallow ECN marking threshold needed for
   L4S.  It is exacerbated by the typically greater mismatch between the
   link rate of the sending host and typical Internet access
   bottlenecks.  This problem is detrimental in general, but would
   particularly harm the performance of short flows relative to Classic
   congestion controls.

Appendix B.  Alternative Identifiers

   This appendix is informative, not normative.  It records the pros and
   cons of various alternative ways to identify L4S packets to record
   the rationale for the choice of ECT(1) (Appendix B.1) as the L4S
   identifier.  At the end, Appendix B.8 summarises the distinguishing
   features of the leading alternatives.  It is intended to supplement,
   not replace the detailed text.

   The leading solutions all use the ECN field, sometimes in combination
   with the Diffserv field.  This is because L4S traffic has to indicate
   that it is ECN-capable anyway, because ECN is intrinsic to how L4S
   works.  Both the ECN and Diffserv fields have the additional
   advantage that they are no different in either IPv4 or IPv6.  A
   couple of alternatives that use other fields are mentioned at the
   end, but it is quickly explained why they are not serious contenders.







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B.1.  ECT(1) and CE codepoints

   Definition:

      Packets with ECT(1) and conditionally packets with CE would
      signify L4S semantics as an alternative to the semantics of
      Classic ECN [RFC3168], specifically:

      *  The ECT(1) codepoint would signify that the packet was sent by
         an L4S-capable sender.

      *  Given shortage of codepoints, both L4S and Classic ECN sides of
         an AQM would have to use the same CE codepoint to indicate that
         a packet had experienced congestion.  If a packet that had
         already been marked CE in an upstream buffer arrived at a
         subsequent AQM, this AQM would then have to guess whether to
         classify CE packets as L4S or Classic ECN.  Choosing the L4S
         treatment would be a safer choice, because then a few Classic
         packets might arrive early, rather than a few L4S packets
         arriving late.

      *  Additional information might be available if the classifier
         were transport-aware.  Then it could classify a CE packet for
         Classic ECN treatment if the most recent ECT packet in the same
         flow had been marked ECT(0).  However, the L4S service ought
         not to need tranport-layer awareness.

   Cons:

   Consumes the last ECN codepoint:  The L4S service could potentially
      supersede the service provided by Classic ECN, therefore using
      ECT(1) to identify L4S packets could ultimately mean that the
      ECT(0) codepoint was 'wasted' purely to distinguish one form of
      ECN from its successor.

   ECN hard in some lower layers:  It is not always possible to support
      ECN in an AQM acting in a buffer below the IP layer
      [I-D.ietf-tsvwg-ecn-encap-guidelines].  In such cases, the L4S
      service would have to drop rather than mark frames even though
      they might encapsulate an ECN-capable packet.

   Risk of reordering Classic CE packets:  Classifying all CE packets
      into the L4S queue risks any CE packets that were originally
      ECT(0) being incorrectly classified as L4S.  If there were delay
      in the Classic queue, these incorrectly classified CE packets
      would arrive early, which is a form of reordering.  Reordering can
      cause TCP senders (and senders of similar transports) to




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      retransmit spuriously.  However, the risk of spurious
      retransmissions would be extremely low for the following reasons:

      1.  It is quite unusual to experience queuing at more than one
          bottleneck on the same path (the available capacities have to
          be identical).

      2.  In only a subset of these unusual cases would the first
          bottleneck support Classic ECN marking while the second
          supported L4S ECN marking, which would be the only scenario
          where some ECT(0) packets could be CE marked by an AQM
          supporting Classic ECN then the remainder experienced further
          delay through the Classic side of a subsequent L4S DualQ AQM.

      3.  Even then, when a few packets are delivered early, it takes
          very unusual conditions to cause a spurious retransmission, in
          contrast to when some packets are delivered late.  The first
          bottleneck has to apply CE-marks to at least N contiguous
          packets and the second bottleneck has to inject an
          uninterrupted sequence of at least N of these packets between
          two packets earlier in the stream (where N is the reordering
          window that the transport protocol allows before it considers
          a packet is lost).

             For example consider N=3, and consider the sequence of
             packets 100, 101, 102, 103,... and imagine that packets
             150,151,152 from later in the flow are injected as follows:
             100, 150, 151, 101, 152, 102, 103...  If this were late
             reordering, even one packet arriving out of sequence would
             trigger a spurious retransmission, but there is no spurious
             retransmission here with early reordering, because packet
             101 moves the cumulative ACK counter forward before 3
             packets have arrived out of order.  Later, when packets
             148, 149, 153... arrive, even though there is a 3-packet
             hole, there will be no problem, because the packets to fill
             the hole are already in the receive buffer.

      4.  Even with the current TCP recommendation of N=3 [RFC5681]
          spurious retransmissions will be unlikely for all the above
          reasons.  As RACK [I-D.ietf-tcpm-rack] is becoming widely
          deployed, it tends to adapt its reordering window to a larger
          value of N, which will make the chance of a contiguous
          sequence of N early arrivals vanishingly small.

      5.  Even a run of 2 CE marks within a Classic ECN flow is
          unlikely, given FQ-CoDel is the only known widely deployed AQM
          that supports Classic ECN marking and it takes great care to




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          separate out flows and to space any markings evenly along each
          flow.

      It is extremely unlikely that the above set of 5 eventualities
      that are each unusual in themselves would all happen
      simultaneously.  But, even if they did, the consequences would
      hardly be dire: the odd spurious fast retransmission.  Whenever
      the traffic source (a Classic congestion control) mistakes the
      reordering of a string of CE marks for a loss, one might think
      that it will reduce its congestion window as well as emitting a
      spurious retransmission.  However, it would have already reduced
      its congestion window when the CE markings arrived early.  If it
      is using ABE [RFC8511], it might reduce cwnd a little more for a
      loss than for a CE mark.  But it will revert that reduction once
      it detects that the retransmission was spurious.

      In conclusion, the impact of early reordering due to CE being
      ambiguous will generally be vanishingly small.

   Hard to distinguish Classic ECN AQM:  With this scheme, when a source
      receives ECN feedback, it is not explicitly clear which type of
      AQM generated the CE markings.  This is not a problem for Classic
      ECN sources that send ECT(0) packets, because an L4S AQM will
      recognize the ECT(0) packets as Classic and apply the appropriate
      Classic ECN marking behaviour.

      However, in the absence of explicit disambiguation of the CE
      markings, an L4S source needs to use heuristic techniques to work
      out which type of congestion response to apply (see
      Appendix A.1.4).  Otherwise, if long-running Classic flow(s) are
      sharing a Classic ECN AQM bottleneck with long-running L4S
      flow(s), which then apply an L4S response to Classic CE signals,
      the L4S flows would outcompete the Classic flow(s).  Experiments
      have shown that L4S flows can take about 20 times more capacity
      share than equivalent Classic flows.  Nonetheless, as link
      capacity reduces (e.g. to 4 4 Mb/s), the inequality reduces.  So
      Classic flows always make progress and are not starved.

      When L4S was first proposed (in 2015, 14 years after [RFC3168] was
      published), it was believed that Classic ECN AQMs had failed to be
      deployed, because research measurements had found little or no
      evidence of CE marking.  In subsequent years Classic ECN was
      included in FQ-CoDel deployments, however an FQ scheduler stops an
      L4S flow outcompeting Classic, because it enforces equality
      between flow rates.  It is not known whether there have been any
      non-FQ deployments of Classic ECN AQMs in the subsequent years, or
      whether there will be in future.




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      An algorithm for detecting a Classic ECN AQM as soon as a flow
      stabilizes after start-up has been proposed [ecn-fallback] (see
      Appendix A.1.4 for a brief summary).  Testbed evaluations of v2 of
      the algorithm have shown detection is reasonably good for Classic
      ECN AQMs, in a wide range of circumstances.  However, although it
      can correctly detect an L4S ECN AQM in many circumstances, its is
      often incorrect at low link capacities and/or high RTTs.  Although
      this is the safe way round, there is a danger that it will
      discourage use of the algorithm.

   Non-L4S service for control packets:  The Classic ECN RFCs [RFC3168]
      and [RFC5562] require a sender to clear the ECN field to Not-ECT
      on retransmissions and on certain control packets specifically
      pure ACKs, window probes and SYNs.  When L4S packets are
      classified by the ECN field, these control packets would not be
      classified into an L4S queue, and could therefore be delayed
      relative to the other packets in the flow.  This would not cause
      reordering (because retransmissions are already out of order, and
      these control packets typically carry no data).  However, it would
      make critical control packets more vulnerable to loss and delay.
      To address this problem, [I-D.ietf-tcpm-generalized-ecn] proposes
      an experiment in which all TCP control packets and retransmissions
      are ECN-capable as long as appropriate ECN feedback is available
      in each case.

   Pros:

   Should work e2e:  The ECN field generally works end-to-end across the
      Internet.  Unlike the DSCP, the setting of the ECN field is at
      least forwarded unchanged by networks that do not support ECN, and
      networks rarely clear it to zero.

   Should work in tunnels:  Unlike Diffserv, ECN is defined to always
      work across tunnels.  This scheme works within a tunnel that
      propagates the ECN field in any of the variant ways it has been
      defined, from the year 2001 [RFC3168] onwards.  However, it is
      likely that some tunnels still do not implement ECN propagation at
      all.

   Could migrate to one codepoint:  If all Classic ECN senders
      eventually evolve to use the L4S service, the ECT(0) codepoint
      could be reused for some future purpose, but only once use of
      ECT(0) packets had reduced to zero, or near-zero, which might
      never happen.

   L4 not required:  Being based on the ECN field, this scheme does not
      need the network to access transport layer flow identifiers.
      Nonetheless, it does not preclude solutions that do.



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B.2.  ECN-DualQ-SCE1

   Definition:

      In this proposal, an L4S AQM would indicate congestion with ECT(1)
      in contrast to a Classic AQM, which indicates congestion with CE.
      More specifically:

      *  Given shortage of codepoints, with this proposal L4S ECN hosts
         send packets as ECT(0), like Classic ECN does by default
         [RFC8311] hosts.

      *  If the ECT(1) codepoint were used to indicate congestion in
         this way, it would signify a shallow queue AQM to the end-to-
         end transport.  So those who proposed this approach called it
         'Some Congestion Experienced' (SCE) because of its similarity
         to [I-D.morton-tsvwg-sce].  It has also been described as
         'ECT(1) on output', in contrast to the 'ECT(1) on input'
         approach outlined in Appendix B.1.

      *  The approach works best if the network is transport-aware and
         isolates each application flow in its own queue (per-flow
         queuing, or FQ).  Two AQMs are implemented in each queue, one
         with a shallow target that marks selected ECT packets as
         ECT(1), the other with a deeper target that marks selected ECT
         packets as CE, or drops selected non-ECT packets.

      *  A Classic congestion control would not have the logic to
         recognize ECT(1) as a congestion signal.  So it would
         (correctly) drive the queue to the deeper threshold, responding
         only to CE markings.  An L4S congestion control that
         understands this scheme would respond to ECT(1) markings, which
         ought to therefore keep the queue close to the shallower
         threshold.

      *  A dual queue approach has been informally proposed, with an L4S
         and a Classic queue and coupling similar to
         [I-D.ietf-tsvwg-aqm-dualq-coupled].  In an interim
         classification, all ECT packets would be classified into the
         low latency queue, and non-ECT packets into the Classic queue.
         But then, in front of the low latency queue, a stateful flow
         characterization function would maintain a queue occupancy
         metric.  It would then redirect any high occupancy flows into
         the Classic queue.

   Cons:





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   Network requires transport-layer awareness:  There is no variant of
      this approach that works without network visibility of transport
      layer flow identifiers (the 5-tuple).  Obviously the FQ variant
      needs to see 5-tuples, but so does the DualQ SCE1 variant (to
      redirect flows based on sparseness).  So there is no arrangement
      of this approach that operators could choose if they could not
      access the transport layer, or did not want to (e.g. to support
      full end-to-end encryption above the IP layer).

   Incomplete isolation:  When evaluated, the DualQ variant of ECN-
      DualQ-SCE1 introduced impairments to both L4S and Classic flows.
      The evaluation used the DOCSIS queue protection function
      [I-D.briscoe-docsis-q-protection] to maintain the per-flow
      sparseness metrics and redirect packets from non-sparse flows into
      the Classic queue.  Unfortunately, it is impossible to determine
      non-sparseness until sufficient packets of each flow have been
      analyzed.  Up to this point, all packets default to the L4S queue.
      Then:

      *  Long-running Classic flows experience reordering during the
         transition to classifying them as Classic.  Worse, the
         reordering occurs early in the flow when it is less robust to
         confusing RTT measurements;

      *  Considerable numbers of Classic packets add to the L4S queue -
         from all the short flows and the start of long flows before the
         classifier can be certain enough to redirect them to the other
         (Classic) queue.  So true L4S flows unavoidably experience a
         degree of extra delay.

   Consumes the last ECN codepoint:  The L4S service could potentially
      supersede the service provided by Classic ECN, therefore using
      ECT(1) to indicate L4S congestion could ultimately mean that the
      CE codepoint was 'wasted' purely to distinguish one form of
      congestion from its successor.

   Only recently updated tunnels:  If this scheme is applied to an outer
      header within a tunnel or lower layer encapsulation, the ECT(1)
      codepoint will be black-holed at decapsulation, unless the
      decapsulator complies with changes to IP-in-IP tunnels introduced
      in 2010 [RFC6040], or changes to other tunnels that are
      (currently) work in progress [I-D.ietf-tsvwg-rfc6040update-shim],
      [I-D.ietf-tsvwg-ecn-encap-guidelines].

   Limited TCP support for feedback:  This approach requires transport
      layer feedback of two congestion signals ECT(1) and CE.  Recently
      developed protocols such as QUIC provide this by default.
      However, there is limited space in the main TCP header to feed



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      back both signals reliably and accurately [RFC7560].  AccECN
      [I-D.ietf-tcpm-accurate-ecn] devotes the limited space in the main
      TCP header to CE feedback, and optionally feeds back ECT(1) in a
      new TCP option, which will have limited initial deployment
      support.

   Alters non-participating packets:  An AQM following this approach
      alters some selected ECT(0) packets to ECT(1) irrespective of
      whether they are participating in the L4S experiment.  Although
      ECT(0) and ECT(1) have historically been defined as equivalent, in
      practice ECT(1) packets have been extremely rare on the Internet.
      Therefore, in practice, there might be a risk that firewalls and
      other devices will block ECT(1) packets, or at least treat them
      with greater suspicion.

   ECN hard in some lower layers:  Similarly to the 'Con' point in
      Appendix B.1, it is not always possible to support ECN in an AQM
      acting in a buffer below the IP layer
      [I-D.ietf-tsvwg-ecn-encap-guidelines].  However, adding support to
      lower layers would be even harder with this scheme, because it
      needs space for two severity levels of congestion, not one.
      Without lower layer ECN support, the L4S service would have to
      drop rather than mark frames even though they might encapsulate an
      ECN-capable packet. .

   Non-L4S service for control packets:  Identical to 'Con' point in
      Appendix B.1.

   Pros:

   Distinct indication of Classic ECN AQM:  An AQM following the ECN-
      DualQ-SCE1 approach outputs distinctive signals (ECT(1)) compared
      to those output by a Classic ECN AQM.  So an L4S congestion
      control using the SCE1 approach would inherently respond
      appropriately to a Classic AQM.

   Should work e2e:  Identical to 'Pro' point in Appendix B.1.

B.3.  ECN-DualQ-SCE0

   Definition:

      This proposal is the inverse of the ECN-DualQ-SCE1 scheme (see
      Appendix B.2 above).  L4S AQMs signal congestion with the
      transition ECT(1) -> ECT(0).  More specifically:

      *  L4S senders would send their packets as ECT(1), while Classic
         ECN senders would continue to send ECT(0) by default [RFC8311].



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      *  FQ AQMs would work in a similar way to that described for ECN-
         DualQ-SCE1 in Appendix B.2 above.  Except the shallow queue AQM
         would mark selected ECT packets with ECT(0), rather than
         ECT(1).

         It would seem possible to classify packets by both 5-tuple and
         ECT codepoint, so that each per-flow queue could instantiate
         just the one AQM appropriate to the ECT codepoint using it.  In
         this case, CE and Not-ECT packets would be classified into the
         same queue as ECT(0).  However, this would open up the risk of
         reordering explained below, so it is not considered further.

      *  A Classic congestion control would only receive CE feedback,
         and it would have no logic to recognize ECT(0) as congestion
         markings, because it would send all its packets as ECT(0)
         anyway.  So it would (correctly) drive the queue to the deeper
         threshold, responding only to CE markings.  An L4S congestion
         control would understand ECT(0) markings as L4S congestion
         signals and therefore ought to keep the queue close to the
         shallower threshold.

      *  Under the SCE0 scheme, a dual queue coupled AQM
         [I-D.ietf-tsvwg-aqm-dualq-coupled] would use ECT(1) as the L4S
         classifier in a very similar way to the 'ECT(1) and CE' scheme
         it was originally designed for.  The one difference would be to
         classify CE packets into the Classic queue along with ECT(0)
         and Not-ECT.

   Cons:

   Consumes the last ECN codepoint:  The L4S service could potentially
      supersede the service provided by Classic ECN, therefore using
      ECT(0) to indicate L4S congestion could ultimately mean that the
      CE codepoint was 'wasted' purely to distinguish one form of
      congestion from its successor.

   Incompatible with all ECN tunnels:  The transition ECT(1) -> ECT(0)
      has never previously been recognized as valid.  So, any ECT(0)
      marking applied to an ECT(1) outer header within a tunnel or lower
      layer encapsulation will be black-holed at decapsulation by any
      decapsulator whatever variant of ECN tunnel RFC it complies with.

   Limited TCP support for feedback:  Identical to 'Con' point in
      Appendix B.2 above except space would be needed for CE and ECT(0)
      rather than CE and ECT(1) feedback.

   Risk of reordering Classic CE packets:  If an L4S flow traverses a
      path with two or more bottleneck AQMs that both support L4S,



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      reordering is likely to occur.  This is because the first
      bottleneck will re-mark some ECT(1) packets to ECT(0), which will
      then be classified into the Classic queue of the second AQM, even
      though they originated as L4S packets.

      In contrast to the 'ECT(1) and CE' scheme in Appendix B.1, the
      risk of impairment in the ECN-DualQ-SCE0 case is not vanishingly
      small:

      1.  Certainly, queuing at more than one bottleneck on the same
          path would still be quite unusual.

      2.  However, the ECN-DualQ-SCE0 case occurs if both bottlenecks
          support L4S ECN and the traffic is L4S.  This contrasts with
          the "ECT(1) and CE" case, which solely occurs if the AQMs are
          in a certain order (Classic followed by L4S).

      3.  When misclassification occurs, it is from L4S to Classic.  So
          selected packets are delivered late, which in itself adds
          delay, and also increases the risk that each late delivery
          will be deemed a loss and cause a high level of spurious
          retransmissions.  This contrasts with the "ECT(1) and CE" case
          where selected packets are delivered early, which is very
          unlikely to have any effect (as already explained in
          Appendix B.1).

   ECN hard in some lower layers:  Identical to 'Con' point in
      Appendix B.2.

   Non-L4S service for control packets:  Identical to 'Con' point in
      Appendix B.1.

   Pros:

   Distinct indication of Classic ECN AQM:  An AQM following the ECN-
      DualQ-SCE0 approach outputs distinctive signals (ECT(0)) compared
      to those output by a Classic ECN AQM (CE).  So an L4S congestion
      control can inherently respond appropriately to a Classic AQM.

   Should work e2e:  Identical to 'Pro' point in Appendix B.1.

B.4.  ECN Plus a Diffserv Codepoint (DSCP)

   Definition:

      For packets with a defined DSCP, all codepoints of the ECN field
      (except Not-ECT) would signify alternative L4S semantics to those
      for Classic ECN [RFC3168], specifically:



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      *  The L4S DSCP would signify that the packet came from an L4S-
         capable sender.

      *  ECT(0) and ECT(1) would both signify that the packet was
         travelling between transport endpoints that were both ECN-
         capable.

      *  CE would signify that the packet had been marked by an AQM
         implementing the L4S service.

   Use of a DSCP is the only approach for alternative ECN semantics
   given as an example in [RFC4774].  However, it was perhaps considered
   more for controlled environments than new end-to-end services.

   Cons:

   Consumes DSCP pairs:  A DSCP is by definition not orthogonal to
      Diffserv.  Therefore, wherever the L4S service is applied to
      multiple Diffserv scheduling behaviours, it would be necessary to
      replace each DSCP with a pair of DSCPs.

   Uses critical lower-layer header space:  The resulting increased
      number of DSCPs might be hard to support for some lower layer
      technologies, e.g. 802.1Q and MPLS both offer only 3-bits for a
      maximum of 8 traffic class identifiers.  Although L4S should
      reduce and possibly remove the need for some DSCPs intended for
      differentiated queuing delay, it will not remove the need for
      Diffserv entirely, because Diffserv is also used to allocate
      bandwidth, e.g. by prioritising some classes of traffic over
      others when traffic exceeds available capacity.

   Not end-to-end (host-network):  Very few networks honour a DSCP set
      by a host.  Typically a network will zero (bleach) the Diffserv
      field from all hosts.  DSCP bleaching would turn an L4S ECN packet
      into a Classic ECN packet.

   Not end-to-end (network-network):  Very few networks honour a DSCP
      received from a neighbouring network.  Typically a network will
      zero (bleach) the Diffserv field from all neighbouring networks at
      an interconnection point.  Sometimes bilateral arrangements are
      made between networks, such that the receiving network remarks
      some DSCPs to those it uses for roughly equivalent services.  The
      likelihood that a DSCP will be bleached or ignored depends on the
      type of DSCP:

      Local-use DSCP:  These tend to be used to implement application-
         specific network policies, but a bilateral arrangement to
         remark certain DSCPs is often applied to DSCPs in the local-use



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         range simply because it is easier not to change all of a
         network's internal configurations when a new arrangement is
         made with a neighbour.

      Recommended standard DSCP:  These do not tend to be honoured
         across network interconnections more than local-use DSCPs.
         However, if two networks decide to honour certain of each
         other's DSCPs, the reconfiguration is a little easier if both
         of their globally recognised services are already represented
         by the relevant recommended standard DSCPs.

         Note that today a recommended standard DSCP gives little more
         assurance of end-to-end service than a local-use DSCP.  In
         future the range recommended as standard might give more
         assurance of end-to-end service than local-use, but it is
         unlikely that either assurance will be high, particularly given
         the hosts are included in the end-to-end path.

      Whenever DSCP bleaching did occur, it would turn an L4S ECN packet
      into a Classic ECN packet.

   Not all tunnels:  Diffserv codepoints are often not propagated to the
      outer header when a packet is encapsulated by a tunnel header.
      DSCPs are propagated to the outer of uniform mode tunnels, but not
      pipe mode [RFC2983], and pipe mode is fairly common.  Whenever
      pipe mode was used, it would temporarily turn an L4S ECN packet
      into a Classic ECN packet.

   ECN hard in some lower layers::  Because this approach uses both the
      Diffserv and ECN fields, an AQM will only work at a lower layer if
      both can be supported.  If individual network operators wished to
      deploy an AQM at a lower layer, they would usually propagate an IP
      Diffserv codepoint to the lower layer, using for example IEEE
      802.1p.  However, the ECN capability is harder to propagate down
      to lower layers because few lower layers support it.

   Hard to distinguish Classic ECN AQM:  Defining a DSCP to indicate L4S
      is a way to help network nodes identify L4S packets (albeit
      unreliable due to the likelihood of bleaching - see above).
      However, it does not help hosts distinguish between ECN markings
      from L4S and Classic AQMs.  This is because Classic AQMs would
      have been implemented without any logic to recognize an L4S DSCP
      or apply L4S marking behaviour.

   Pros:

   Could migrate to e2e:  If all usage of Classic ECN migrates to usage
      of L4S, the DSCP would become redundant, and the ECN capability



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      alone could eventually identify L4S packets without the
      interconnection problems of Diffserv detailed above, and without
      having permanently consumed more than one codepoint in the IP
      header.  Although the DSCP does not generally function as an end-
      to-end identifier (see above), it could be used initially by
      individual ISPs to introduce the L4S service for their own locally
      generated traffic.

B.5.  ECN capability alone

   This approach uses ECN capability alone as the L4S identifier.  It
   would only have been feasible if RFC 3168 ECN had not been widely
   deployed.  This was the case when the choice of L4S identifier was
   being made and this appendix was first written.  Since then, RFC 3168
   ECN has been widely deployed and L4S did not take this approach
   anyway.  So this approach is not discussed further, because it is no
   longer a feasible option.

B.6.  Protocol ID

   It has been suggested that a new Protocol ID in the IPv4 Protocol
   field or the IPv6 Next Header field could identify L4S packets.
   However this approach is ruled out by numerous problems:

   o  A duplicate protocol ID would need to be created for each
      transport (TCP, SCTP, UDP, etc.).

   o  In IPv6, there can be a sequence of Next Header fields, and it
      would not be obvious which one would be expected to identify a
      network service like L4S.

   o  A new protocol ID would rarely provide an end-to-end service,
      because It is well-known that new protocol IDs are often blocked
      by numerous types of middlebox.

   o  The approach is not a solution for AQM methods below the IP layer.

B.7.  Source or destination addressing

   Locally, a network operator could arrange for L4S service to be
   applied based on source or destination addressing, e.g. packets from
   its own data centre and/or CDN hosts, packets to its business
   customers, etc.  It could use addressing at any layer, e.g. IP
   addresses, MAC addresses, VLAN IDs, etc.  Although addressing might
   be a useful tactical approach for a single ISP, it would not be a
   feasible approach to identify an end-to-end service like L4S.  Even
   for a single ISP, it would require packet classifiers in buffers to
   be dependent on changing topology and address allocation decisions



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   elsewhere in the network.  Therefore this approach is not a feasible
   solution.

B.8.  Summary: Merits of Alternative Identifiers

   Table 1 and Table 2 provide a very high level summary of the pros and
   cons detailed against the schemes described respectively in
   Appendix B.1, Appendix B.4, Appendix B.2 and Appendix B.3 for nine
   issues that set them apart.

      +----------------+----------------------+--------------------+
      | Issue          | ECT(1) + CE (Chosen) |     DSCP + ECN     |
      +----------------+----------------------+--------------------+
      |                |  initial   eventual  | initial   eventual |
      |                |                      |                    |
      | end-to-end     |   . . Y      . . Y   |  N . .      . ? .  |
      | tunnels        |   . . ?      . . Y   |  . O .      . O .  |
      | lower layers   |   . O .      . . ?   |  N . .      . ? .  |
      | codepoints     |   N . .      . . ?   |  N . .      . . ?  |
      | reordering     |   . O .      . . ?   |  . . Y      . . Y  |
      | identify C AQM |   . O .      . . ?   |  . O .      . . ?  |
      | L3-only poss.  |   . . Y      . . Y   |  . . Y      . . Y  |
      | TCP feedback   |   . O .      . . Y   |  . O .      . . Y  |
      | TCP ctrl pkts  |   . O .      . . ?   |  . . Y      . . Y  |
      +----------------+----------------------+--------------------+

           Table 1: Merits of Alternative L4S Identifiers (pt 1)

       +----------------+--------------------+--------------------+
       | Issue          |   ECN-DualQ-SCE1   |   ECN-DualQ-SCE0   |
       +----------------+--------------------+--------------------+
       |                | initial   eventual | initial   eventual |
       |                |                    |                    |
       | end-to-end     |  . . Y      . . Y  |  . . Y      . . Y  |
       | tunnels        |  . ? .      . . ?  |  N . .      ? . .  |
       | lower layers   |  N . .      . ? .  |  N . .      ? . .  |
       | codepoints     |  N . .      . ? .  |  N . .      . ? .  |
       | reordering     |  N . .      N . .  |  N . .      N . .  |
       | identify C AQM |  . . Y      . . Y  |  . . Y      . . Y  |
       | L3-only poss   |  N . .      N . .  |  . . Y      . . Y  |
       | TCP feedback   |  N . .      . O .  |  N . .      . O .  |
       | TCP ctrl pkts  |  . O .      . . ?  |  . O .      . . ?  |
       +----------------+--------------------+--------------------+

           Table 2: Merits of Alternative L4S Identifiers (pt 2)

   The schemes are scored based on both their capabilities now
   ('initial') and in the long term ('eventual').  The scores are one of



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   'N, O, Y', meaning 'Poor', 'Ordinary', 'Good' respectively.  The same
   scores are aligned vertically to aid the eye.  A score of "?" in one
   of the positions means that this approach might optimistically become
   this good, given sufficient effort.  The tables summarize the text
   and are not meant to be understandable without having read the text.

Appendix C.  Potential Competing Uses for the ECT(1) Codepoint

   The ECT(1) codepoint of the ECN field has already been assigned once
   for the ECN nonce [RFC3540], which has now been categorized as
   historic [RFC8311].  ECN is probably the only remaining field in the
   Internet Protocol that is common to IPv4 and IPv6 and still has
   potential to work end-to-end, with tunnels and with lower layers.
   Therefore, ECT(1) should not be reassigned to a different
   experimental use (L4S) without carefully assessing competing
   potential uses.  These fall into the following categories:

C.1.  Integrity of Congestion Feedback

   Receiving hosts can fool a sender into downloading faster by
   suppressing feedback of ECN marks (or of losses if retransmissions
   are not necessary or available otherwise).

   The historic ECN nonce protocol [RFC3540] proposed that a TCP sender
   could set either of ECT(0) or ECT(1) in each packet of a flow and
   remember the sequence it had set.  If any packet was lost or
   congestion marked, the receiver would miss that bit of the sequence.
   An ECN Nonce receiver had to feed back the least significant bit of
   the sum, so it could not suppress feedback of a loss or mark without
   a 50-50 chance of guessing the sum incorrectly.

   It is highly unlikely that ECT(1) will be needed for integrity
   protection in future.  The ECN Nonce RFC [RFC3540] as been
   reclassified as historic, partly because other ways have been
   developed to protect feedback integrity of TCP and other transports
   [RFC8311] that do not consume a codepoint in the IP header.  For
   instance:

   o  the sender can test the integrity of the receiver's feedback by
      occasionally setting the IP-ECN field to a value normally only set
      by the network.  Then it can test whether the receiver's feedback
      faithfully reports what it expects (see para 2 of Section 20.2 of
      [RFC3168].  This works for loss and it will work for the accurate
      ECN feedback [RFC7560] intended for L4S.

   o  A network can enforce a congestion response to its ECN markings
      (or packet losses) by auditing congestion exposure (ConEx)
      [RFC7713].  Whether the receiver or a downstream network is



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      suppressing congestion feedback or the sender is unresponsive to
      the feedback, or both, ConEx audit can neutralise any advantage
      that any of these three parties would otherwise gain.

   o  The TCP authentication option (TCP-AO [RFC5925]) can be used to
      detect any tampering with TCP congestion feedback (whether
      malicious or accidental).  TCP's congestion feedback fields are
      immutable end-to-end, so they are amenable to TCP-AO protection,
      which covers the main TCP header and TCP options by default.
      However, TCP-AO is often too brittle to use on many end-to-end
      paths, where middleboxes can make verification fail in their
      attempts to improve performance or security, e.g. by
      resegmentation or shifting the sequence space.

C.2.  Notification of Less Severe Congestion than CE

   Various researchers have proposed to use ECT(1) as a less severe
   congestion notification than CE, particularly to enable flows to fill
   available capacity more quickly after an idle period, when another
   flow departs or when a flow starts, e.g. VCP [VCP], Queue View (QV)
   [QV].

   Before assigning ECT(1) as an identifier for L4S, we must carefully
   consider whether it might be better to hold ECT(1) in reserve for
   future standardisation of rapid flow acceleration, which is an
   important and enduring problem [RFC6077].

   Pre-Congestion Notification (PCN) is another scheme that assigns
   alternative semantics to the ECN field.  It uses ECT(1) to signify a
   less severe level of pre-congestion notification than CE [RFC6660].
   However, the ECN field only takes on the PCN semantics if packets
   carry a Diffserv codepoint defined to indicate PCN marking within a
   controlled environment.  PCN is required to be applied solely to the
   outer header of a tunnel across the controlled region in order not to
   interfere with any end-to-end use of the ECN field.  Therefore a PCN
   region on the path would not interfere with any of the L4S service
   identifiers proposed in Appendix B.

Authors' Addresses

   Koen De Schepper
   Nokia Bell Labs
   Antwerp
   Belgium

   Email: koen.de_schepper@nokia.com
   URI:   https://www.bell-labs.com/usr/koen.de_schepper




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   Bob Briscoe (editor)
   Independent
   UK

   Email: ietf@bobbriscoe.net
   URI:   http://bobbriscoe.net/













































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