RFC7323

Internet Engineering Task Force (IETF) D. Borman Request for Comments: 7323 Quantum Corporation Obsoletes: 1323 B. Braden Category: Standards Track University of Southern California ISSN: 2070-1721 V. Jacobson

                                                        Google, Inc.
                                               R. Scheffenegger, Ed.
                                                        NetApp, Inc.
                                                      September 2014

              TCP Extensions for High Performance

Abstract

This document specifies a set of TCP extensions to improve performance over paths with a large bandwidth * delay product and to provide reliable operation over very high-speed paths. It defines the TCP Window Scale (WS) option and the TCP Timestamps (TS) option and their semantics. The Window Scale option is used to support larger receive windows, while the Timestamps option can be used for at least two distinct mechanisms, Protection Against Wrapped Sequences (PAWS) and Round-Trip Time Measurement (RTTM), that are also described herein.

This document obsoletes RFC 1323 and describes changes from it.

Status of This Memo

This is an Internet Standards Track document.

This document is a product of the Internet Engineering Task Force (IETF). It represents the consensus of the IETF community. It has received public review and has been approved for publication by the Internet Engineering Steering Group (IESG). Further information on Internet Standards is available in Section 2 of RFC 5741.

Information about the current status of this document, any errata, and how to provide feedback on it may be obtained at http://www.rfc-editor.org/info/rfc7323.

Copyright Notice

Copyright (c) 2014 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 (http://trustee.ietf.org/license-info) in effect on the date of publication of this document. Please review these documents carefully, as they describe your rights and restrictions with respect to this document. Code Components extracted from this document must include Simplified BSD License text as described in Section 4.e of the Trust Legal Provisions and are provided without warranty as described in the Simplified BSD License.

 5.8.  Duplicates from Earlier Incarnations of Connection  . . .  26

Appendix B. Duplicates from Earlier Connection Incarnations . . 35

Introduction

The TCP protocol RFC0793 was designed to operate reliably over almost any transmission medium regardless of transmission rate, delay, corruption, duplication, or reordering of segments. Over the years, advances in networking technology have resulted in ever-higher transmission speeds, and the fastest paths are well beyond the domain for which TCP was originally engineered.

This document defines a set of modest extensions to TCP to extend the domain of its application to match the increasing network capability. It is an update to and obsoletes RFC1323, which in turn is based upon and obsoletes RFC1072 and RFC1185.

Changes between RFC1323 and this document are detailed in Appendix H. These changes are partly due to errata in RFC1323, and partly due to the improved understanding of how the involved components interact.

For brevity, the full discussions of the merits and history behind the TCP options defined within this document have been omitted. RFC1323 should be consulted for reference. It is recommended that a modern TCP stack implements and make use of the extensions described in this document.

TCP Performance

TCP performance problems arise when the bandwidth * delay product is large. A network having such paths is referred to as a "long, fat network" (LFN).

There are two fundamental performance problems with basic TCP over LFN paths:

(1) Window Size Limit

    The TCP header uses a 16-bit field to report the receive window
    size to the sender.  Therefore, the largest window that can be
    used is 2^16 = 64 KiB.  For LFN paths where the bandwidth *
    delay product exceeds 64 KiB, the receive window limits the
    maximum throughput of the TCP connection over the path, i.e.,
    the amount of unacknowledged data that TCP can send in order to
    keep the pipeline full.

    To circumvent this problem, Section 2 of this memo defines a TCP
    option, "Window Scale", to allow windows larger than 2^16.  This
    option defines an implicit scale factor, which is used to
    multiply the window size value found in a TCP header to obtain
    the true window size.

    It must be noted that the use of large receive windows increases
    the chance of too quickly wrapping sequence numbers, as
    described below in Section 1.2, (1).

(2) Recovery from Losses

    Packet losses in an LFN can have a catastrophic effect on
    throughput.

    To generalize the Fast Retransmit / Fast Recovery mechanism to
    handle multiple packets dropped per window, Selective
    Acknowledgments are required.  Unlike the normal cumulative
    acknowledgments of TCP, Selective Acknowledgments give the
    sender a complete picture of which segments are queued at the
    receiver and which have not yet arrived.

    Selective Acknowledgments and their use are specified in
    separate documents, "TCP Selective Acknowledgment Options"
    RFC2018, "An Extension to the Selective Acknowledgement (SACK)
    Option for TCP" RFC2883, and "A Conservative Loss Recovery
    Algorithm Based on Selective Acknowledgment (SACK) for TCP"
    RFC6675, and are not further discussed in this document.

TCP Reliability

An especially serious kind of error may result from an accidental reuse of TCP sequence numbers in data segments. TCP reliability depends upon the existence of a bound on the lifetime of a segment: the "Maximum Segment Lifetime" or MSL.

Duplication of sequence numbers might happen in either of two ways:

(1) Sequence number wrap-around on the current connection

    A TCP sequence number contains 32 bits.  At a high enough
    transfer rate of large volumes of data (at least 4 GiB in the
    same session), the 32-bit sequence space may be "wrapped"
    (cycled) within the time that a segment is delayed in queues.

(2) Earlier incarnation of the connection

    Suppose that a connection terminates, either by a proper close
    sequence or due to a host crash, and the same connection (i.e.,
    using the same pair of port numbers) is immediately reopened.  A
    delayed segment from the terminated connection could fall within
    the current window for the new incarnation and be accepted as
    valid.

Duplicates from earlier incarnations, case (2), are avoided by enforcing the current fixed MSL of the TCP specification, as explained in Section 5.8 and Appendix B. In addition, the randomizing of ephemeral ports can also help to probabilistically reduce the chances of duplicates from earlier connections. However, case (1), avoiding the reuse of sequence numbers within the same connection, requires an upper bound on MSL that depends upon the transfer rate, and at high enough rates, a dedicated mechanism is required.

A possible fix for the problem of cycling the sequence space would be to increase the size of the TCP sequence number field. For example, the sequence number field (and also the acknowledgment field) could be expanded to 64 bits. This could be done either by changing the TCP header or by means of an additional option.

Section 5 presents a different mechanism, which we call PAWS, to extend TCP reliability to transfer rates well beyond the foreseeable upper limit of network bandwidths. PAWS uses the TCP Timestamps option defined in Section 3.2 to protect against old duplicates from the same connection.

Using TCP options

The extensions defined in this document all use TCP options.

When RFC1323 was published, there was concern that some buggy TCP implementation might crash on the first appearance of an option on a non-<SYN> segment. However, bugs like that can lead to denial-of- service (DoS) attacks against a TCP. Research has shown that most TCP implementations will properly handle unknown options on non-<SYN> segments ([Medina04], [Medina05]). But it is still prudent to be conservative in what you send, and avoiding buggy TCP implementation is not the only reason for negotiating TCP options on <SYN> segments.

The Window Scale option negotiates fundamental parameters of the TCP session. Therefore, it is only sent during the initial handshake. Furthermore, the Window Scale option will be sent in a <SYN,ACK> segment only if the corresponding option was received in the initial <SYN> segment.

The Timestamps option may appear in any data or <ACK> segment, adding 10 bytes (up to 12 bytes including padding) to the 20-byte TCP header. It is required that this TCP option will be sent on all non-<SYN> segments after an exchange of options on the <SYN> segments has indicated that both sides understand this extension.

Research has shown that the use of the Timestamps option to take additional RTT samples within each RTT has little effect on the ultimate retransmission timeout value [Allman99]. However, there are other uses of the Timestamps option, such as the Eifel mechanism (RFC3522, RFC4015) and PAWS (see Section 5), which improve overall TCP security and performance. The extra header bandwidth used by this option should be evaluated for the gains in performance and security in an actual deployment.

Appendix A contains a recommended layout of the options in TCP headers to achieve reasonable data field alignment.

Finally, we observe that most of the mechanisms defined in this document are important for LFNs and/or very high-speed networks. For low-speed networks, it might be a performance optimization to NOT use these mechanisms. A TCP vendor concerned about optimal performance over low-speed paths might consider turning these extensions off for low-speed paths, or allow a user or installation manager to disable them.

Terminology

The key words "MUST", "MUST NOT", "REQUIRED", "SHALL", "SHALL NOT", "SHOULD", "SHOULD 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 UPPER CASE. Lower case uses of these words are not to be interpreted as carrying RFC2119 significance.

TCP Window Scale Option

Introduction

The window scale extension expands the definition of the TCP window to 30 bits and then uses an implicit scale factor to carry this 30-bit value in the 16-bit window field of the TCP header (SEG.WND in RFC0793). The exponent of the scale factor is carried in a TCP option, Window Scale. This option is sent only in a <SYN> segment (a segment with the SYN bit on), hence the window scale is fixed in each direction when a connection is opened.

The maximum receive window, and therefore the scale factor, is determined by the maximum receive buffer space. In a typical modern implementation, this maximum buffer space is set by default but can be overridden by a user program before a TCP connection is opened. This determines the scale factor, and therefore no new user interface is needed for window scaling.

Window Scale Option

The three-byte Window Scale option MAY be sent in a <SYN> segment by a TCP. It has two purposes: (1) indicate that the TCP is prepared to both send and receive window scaling, and (2) communicate the exponent of a scale factor to be applied to its receive window. Thus, a TCP that is prepared to scale windows SHOULD send the option, even if its own scale factor is 1 and the exponent 0. The scale factor is limited to a power of two and encoded logarithmically, so it may be implemented by binary shift operations. The maximum scale exponent is limited to 14 for a maximum permissible receive window size of 1 GiB (2^(14+16)).

TCP Window Scale option (WSopt):

Kind: 3

Length: 3 bytes

      +---------+---------+---------+
      | Kind=3  |Length=3 |shift.cnt|
      +---------+---------+---------+
           1         1         1

This option is an offer, not a promise; both sides MUST send Window Scale options in their <SYN> segments to enable window scaling in either direction. If window scaling is enabled, then the TCP that sent this option will right-shift its true receive-window values by 'shift.cnt' bits for transmission in SEG.WND. The value 'shift.cnt'

MAY be zero (offering to scale, while applying a scale factor of 1 to the receive window).

This option MAY be sent in an initial <SYN> segment (i.e., a segment with the SYN bit on and the ACK bit off). If a Window Scale option was received in the initial <SYN> segment, then this option MAY be sent in the <SYN,ACK> segment. A Window Scale option in a segment without a SYN bit MUST be ignored.

The window field in a segment where the SYN bit is set (i.e., a <SYN> or <SYN,ACK>) MUST NOT be scaled.

Using the Window Scale Option

A model implementation of window scaling is as follows, using the notation of RFC0793:

o The connection state is augmented by two window shift counters,

  Snd.Wind.Shift and Rcv.Wind.Shift, to be applied to the incoming
  and outgoing window fields, respectively.

o If a TCP receives a <SYN> segment containing a Window Scale

  option, it SHOULD send its own Window Scale option in the
  <SYN,ACK> segment.

o The Window Scale option MUST be sent with shift.cnt = R, where R

  is the value that the TCP would like to use for its receive
  window.

o Upon receiving a <SYN> segment with a Window Scale option

  containing shift.cnt = S, a TCP MUST set Snd.Wind.Shift to S and
  MUST set Rcv.Wind.Shift to R; otherwise, it MUST set both
  Snd.Wind.Shift and Rcv.Wind.Shift to zero.

o The window field (SEG.WND) in the header of every incoming

  segment, with the exception of <SYN> segments, MUST be left-
  shifted by Snd.Wind.Shift bits before updating SND.WND:

                SND.WND = SEG.WND << Snd.Wind.Shift

  (assuming the other conditions of RFC0793 are met, and using the
  "C" notation "<<" for left-shift).

o The window field (SEG.WND) of every outgoing segment, with the

  exception of <SYN> segments, MUST be right-shifted by
  Rcv.Wind.Shift bits:

                SEG.WND = RCV.WND >> Rcv.Wind.Shift

TCP determines if a data segment is "old" or "new" by testing whether its sequence number is within 2^31 bytes of the left edge of the window, and if it is not, discarding the data as "old". To insure that new data is never mistakenly considered old and vice versa, the left edge of the sender's window has to be at most 2^31 away from the right edge of the receiver's window. The same is true of the sender's right edge and receiver's left edge. Since the right and left edges of either the sender's or receiver's window differ by the window size, and since the sender and receiver windows can be out of phase by at most the window size, the above constraints imply that two times the maximum window size must be less than 2^31, or

                         max window < 2^30

Since the max window is 2^S (where S is the scaling shift count) times at most 2^16 - 1 (the maximum unscaled window), the maximum window is guaranteed to be < 2^30 if S <= 14. Thus, the shift count MUST be limited to 14 (which allows windows of 2^30 = 1 GiB). If a Window Scale option is received with a shift.cnt value larger than 14, the TCP SHOULD log the error but MUST use 14 instead of the specified value. This is safe as a sender can always choose to only partially use any signaled receive window. If the receiver is scaling by a factor larger than 14 and the sender is only scaling by 14, then the receive window used by the sender will appear smaller than it is in reality.

The scale factor applies only to the window field as transmitted in the TCP header; each TCP using extended windows will maintain the window values locally as 32-bit numbers. For example, the "congestion window" computed by slow start and congestion avoidance (see RFC5681) is not affected by the scale factor, so window scaling will not introduce quantization into the congestion window.

Addressing Window Retraction

When a non-zero scale factor is in use, there are instances when a retracted window can be offered -- see Appendix F for a detailed example. The end of the window will be on a boundary based on the granularity of the scale factor being used. If the sequence number is then updated by a number of bytes smaller than that granularity, the TCP will have to either advertise a new window that is beyond what it previously advertised (and perhaps beyond the buffer) or will have to advertise a smaller window, which will cause the TCP window to shrink. Implementations MUST ensure that they handle a shrinking window, as specified in Section 4.2.2.16 of RFC1122.

For the receiver, this implies that:

1) The receiver MUST honor, as in window, any segment that would

   have been in window for any <ACK> sent by the receiver.

2) When window scaling is in effect, the receiver SHOULD track the

   actual maximum window sequence number (which is likely to be
   greater than the window announced by the most recent <ACK>, if
   more than one segment has arrived since the application consumed
   any data in the receive buffer).

On the sender side:

3) The initial transmission MUST be within the window announced by

   the most recent <ACK>.

4) On first retransmission, or if the sequence number is out of

   window by less than 2^Rcv.Wind.Shift, then do normal
   retransmission(s) without regard to the receiver window as long
   as the original segment was in window when it was sent.

5) Subsequent retransmissions MAY only be sent if they are within

   the window announced by the most recent <ACK>.

TCP Timestamps Option

Introduction

The Timestamps option is introduced to address some of the issues mentioned in Sections 1.1 and 1.2. The Timestamps option is specified in a symmetrical manner, so that Timestamp Value (TSval) timestamps are carried in both data and <ACK> segments and are echoed in Timestamp Echo Reply (TSecr) fields carried in returning <ACK> or data segments. Originally used primarily for timestamping individual segments, the properties of the Timestamps option allow for taking time measurements (Section 4) as well as additional uses (Section 5).

It is necessary to remember that there is a distinction between the Timestamps option conveying timestamp information and the use of that information. In particular, the RTTM mechanism must be viewed independently from updating the Retransmission Timeout (RTO) (see Section 4.2). In this case, the sample granularity also needs to be taken into account. Other mechanisms, such as PAWS or Eifel, are not built upon the timestamp information itself but are based on the intrinsic property of monotonically non-decreasing values.

The Timestamps option is important when large receive windows are used to allow the use of the PAWS mechanism (see Section 5).

Furthermore, the option may be useful for all TCPs, since it simplifies the sender and allows the use of additional optimizations such as Eifel (RFC3522, RFC4015) and others (RFC6817, [Kuzmanovic03], [Kuehlewind10]).

Timestamps Option

TCP is a symmetric protocol, allowing data to be sent at any time in either direction, and therefore timestamp echoing may occur in either direction. For simplicity and symmetry, we specify that timestamps always be sent and echoed in both directions. For efficiency, we combine the timestamp and timestamp reply fields into a single TCP Timestamps option.

TCP Timestamps option (TSopt):

Kind: 8

Length: 10 bytes

      +-------+-------+---------------------+---------------------+
      |Kind=8 |  10   |   TS Value (TSval)  |TS Echo Reply (TSecr)|
      +-------+-------+---------------------+---------------------+
          1       1              4                     4

The Timestamps option carries two four-byte timestamp fields. The TSval field contains the current value of the timestamp clock of the TCP sending the option.

The TSecr field is valid if the ACK bit is set in the TCP header. If the ACK bit is not set in the outgoing TCP header, the sender of that segment SHOULD set the TSecr field to zero. When the ACK bit is set in an outgoing segment, the sender MUST echo a recently received TSval sent by the remote TCP in the TSval field of a Timestamps option. The exact rules on which TSval MUST be echoed are given in Section 4.3. When the ACK bit is not set, the receiver MUST ignore the value of the TSecr field.

A TCP MAY send the TSopt in an initial <SYN> segment (i.e., segment containing a SYN bit and no ACK bit), and MAY send a TSopt in <SYN,ACK> only if it received a TSopt in the initial <SYN> segment for the connection.

Once TSopt has been successfully negotiated, that is both <SYN> and <SYN,ACK> contain TSopt, the TSopt MUST be sent in every non-<RST> segment for the duration of the connection, and SHOULD be sent in an <RST> segment (see Section 5.2 for details). The TCP SHOULD remember this state by setting a flag, referred to as Snd.TS.OK, to one. If a

non-<RST> segment is received without a TSopt, a TCP SHOULD silently drop the segment. A TCP MUST NOT abort a TCP connection because any segment lacks an expected TSopt.

Implementations are strongly encouraged to follow the above rules for handling a missing Timestamps option and the order of precedence mentioned in Section 5.3 when deciding on the acceptance of a segment.

If a receiver chooses to accept a segment without an expected Timestamps option, it must be clear that undetectable data corruption may occur.

Such a TCP receiver may experience undetectable wrapped-sequence effects, such as data (payload) corruption or session stalls. In order to maintain the integrity of the payload data, in particular on high-speed networks, it is paramount to follow the described processing rules.

However, it has been mentioned that under some circumstances, the above guidelines are too strict, and some paths sporadically suppress the Timestamps option, while maintaining payload integrity. A path behaving in this manner should be deemed unacceptable, but it has been noted that some implementations relax the acceptance rules as a workaround and allow TCP to run across such paths [RE-1323BIS].

If a TSopt is received on a connection where TSopt was not negotiated in the initial three-way handshake, the TSopt MUST be ignored and the packet processed normally.

In the case of crossing <SYN> segments where one <SYN> contains a TSopt and the other doesn't, both sides MAY send a TSopt in the <SYN,ACK> segment.

TSopt is required for the two mechanisms described in Sections 4 and 5. There are also other mechanisms that rely on the presence of the TSopt, e.g., RFC3522. If a TCP stopped sending TSopt at any time during an established session, it interferes with these mechanisms. This update to RFC1323 describes explicitly the previous assumption (see Section 5.2) that each TCP segment must have a TSopt, once negotiated.

The RTTM Mechanism

Introduction

One use of the Timestamps option is to measure the round-trip time (RTT) of virtually every packet acknowledged. The RTTM mechanism requires a Timestamps option in every measured segment, with a TSval that is obtained from a (virtual) "timestamp clock". Values of this clock MUST be at least approximately proportional to real time, in order to measure actual RTT.

TCP measures the RTT, primarily for the purpose of arriving at a reasonable value for the RTO timer interval. Accurate and current RTT estimates are necessary to adapt to changing traffic conditions, while a conservative estimate of the RTO interval is necessary to minimize spurious RTOs.

These TSval values are echoed in TSecr values in the reverse direction. The difference between a received TSecr value and the current timestamp clock value provides an RTT measurement.

When timestamps are used, every segment that is received will contain a TSecr value. However, these values cannot all be used to update the measured RTT. The following example illustrates why. It shows a one-way data flow with segments arriving in sequence without loss. Here A, B, C... represent data blocks occupying successive blocks of sequence numbers, and ACK(A),... represent the corresponding cumulative acknowledgments. The two timestamp fields of the Timestamps option are shown symbolically as <TSval=x,TSecr=y>. Each TSecr field contains the value most recently received in a TSval field.

         TCP  A                                     TCP B

                         <A,TSval=1,TSecr=120> ----->

              <---- <ACK(A),TSval=127,TSecr=1>

                         <B,TSval=5,TSecr=127> ----->

              <---- <ACK(B),TSval=131,TSecr=5>

                         <C,TSval=65,TSecr=131> ---->

              <---- <ACK(C),TSval=191,TSecr=65>

                             (etc.)

The dotted line marks a pause (60 time units long) in which A had nothing to send. Note that this pause inflates the RTT, which B could infer from receiving TSecr=131 in data segment C. Thus, in one-way data flows, RTTM in the reverse direction measures a value that is inflated by gaps in sending data. However, the following rule prevents a resulting inflation of the measured RTT:

RTTM Rule: A TSecr value received in a segment MAY be used to update

          the averaged RTT measurement only if the segment advances
          the left edge of the send window, i.e., SND.UNA is
          increased.

Since TCP B is not sending data, the data segment C does not acknowledge any new data when it arrives at B. Thus, the inflated RTTM measurement is not used to update B's RTTM measurement.

Updating the RTO Value

When RFC1323 was originally written, it was perceived that taking RTT measurements for each segment, and also during retransmissions, would contribute to reduce spurious RTOs, while maintaining the timeliness of necessary RTOs. At the time, RTO was also the only mechanism to make use of the measured RTT. It has been shown that taking more RTT samples has only a very limited effect to optimize RTOs [Allman99].

Implementers should note that with timestamps, multiple RTTMs can be taken per RTT. The RFC6298 RTT estimator has weighting factors, alpha and beta, based on an implicit assumption that at most one RTTM will be sampled per RTT. When multiple RTTMs per RTT are available

to update the RTT estimator, an implementation SHOULD try to adhere to the spirit of the history specified in RFC6298. An implementation suggestion is detailed in Appendix G.

[Ludwig00] and [Floyd05] have highlighted the problem that an unmodified RTO calculation, which is updated with per-packet RTT samples, will truncate the path history too soon. This can lead to an increase in spurious retransmissions, when the path properties vary in the order of a few RTTs, but a high number of RTT samples are taken on a much shorter timescale.

Which Timestamp to Echo

If more than one Timestamps option is received before a reply segment is sent, the TCP must choose only one of the TSvals to echo, ignoring the others. To minimize the state kept in the receiver (i.e., the number of unprocessed TSvals), the receiver should be required to retain at most one timestamp in the connection control block.

There are three situations to consider:

(A) Delayed ACKs.

    Many TCPs acknowledge only every second segment out of a group
    of segments arriving within a short time interval; this policy
    is known generally as "delayed ACKs".  The data-sender TCP must
    measure the effective RTT, including the additional time due to
    delayed ACKs, or else it will retransmit unnecessarily.  Thus,
    when delayed ACKs are in use, the receiver SHOULD reply with the
    TSval field from the earliest unacknowledged segment.

(B) A hole in the sequence space (segment(s) has been lost).

    The sender will continue sending until the window is filled, and
    the receiver may be generating <ACK>s as these out-of-order
    segments arrive (e.g., to aid "Fast Retransmit").

    The lost segment is probably a sign of congestion, and in that
    situation the sender should be conservative about
    retransmission.  Furthermore, it is better to overestimate than
    underestimate the RTT.  An <ACK> for an out-of-order segment
    SHOULD, therefore, contain the timestamp from the most recent
    segment that advanced RCV.NXT.

    The same situation occurs if segments are reordered by the
    network.

(C) A filled hole in the sequence space.

    The segment that fills the hole and advances the window
    represents the most recent measurement of the network
    characteristics.  An RTT computed from an earlier segment would
    probably include the sender's retransmit timeout, badly biasing
    the sender's average RTT estimate.  Thus, the timestamp from the
    latest segment (which filled the hole) MUST be echoed.

An algorithm that covers all three cases is described in the following rules for Timestamps option processing on a synchronized connection:

(1) The connection state is augmented with two 32-bit slots:

    TS.Recent holds a timestamp to be echoed in TSecr whenever a
    segment is sent, and Last.ACK.sent holds the ACK field from the
    last segment sent.  Last.ACK.sent will equal RCV.NXT except when
    <ACK>s have been delayed.

(2) If:

        SEG.TSval >= TS.Recent and SEG.SEQ <= Last.ACK.sent

    then SEG.TSval is copied to TS.Recent; otherwise, it is ignored.

(3) When a TSopt is sent, its TSecr field is set to the current

    TS.Recent value.

The following examples illustrate these rules. Here A, B, C... represent data segments occupying successive blocks of sequence numbers, and ACK(A),... represent the corresponding acknowledgment segments. Note that ACK(A) has the same sequence number as B. We show only one direction of timestamp echoing, for clarity.

o Segments arrive in sequence, and some of the <ACK>s are delayed.

  By case (A), the timestamp from the oldest unacknowledged segment
  is echoed.

                                              TS.Recent
            <A, TSval=1> ------------------->
                                                  1
            <B, TSval=2> ------------------->
                                                  1
            <C, TSval=3> ------------------->
                                                  1
                     <---- <ACK(C), TSecr=1>
            (etc.)

o Segments arrive out of order, and every segment is acknowledged.

  By case (B), the timestamp from the last segment that advanced the
  left window edge is echoed until the missing segment arrives; it
  is echoed according to case (C).  The same sequence would occur if
  segments B and D were lost and retransmitted.

                                              TS.Recent
            <A, TSval=1> ------------------->
                                                  1
                     <---- <ACK(A), TSecr=1>
                                                  1
            <C, TSval=3> ------------------->
                                                  1
                     <---- <ACK(A), TSecr=1>
                                                  1
            <B, TSval=2> ------------------->
                                                  2
                     <---- <ACK(C), TSecr=2>
                                                  2
            <E, TSval=5> ------------------->
                                                  2
                     <---- <ACK(C), TSecr=2>
                                                  2
            <D, TSval=4> ------------------->
                                                  4
                     <---- <ACK(E), TSecr=4>
            (etc.)

PAWS - Protection Against Wrapped Sequences

Introduction

Another use for the Timestamps option is the PAWS mechanism. Section 5.2 describes a simple mechanism to reject old duplicate segments that might corrupt an open TCP connection. PAWS operates within a single TCP connection, using state that is saved in the connection control block. Section 5.8 and Appendix H discuss the implications of the PAWS mechanism for avoiding old duplicates from previous incarnations of the same connection.

The PAWS Mechanism

PAWS uses the TCP Timestamps option described earlier and assumes that every received TCP segment (including data and <ACK> segments) contains a timestamp SEG.TSval whose values are monotonically non- decreasing in time. The basic idea is that a segment can be discarded as an old duplicate if it is received with a timestamp SEG.TSval less than some timestamps recently received on this connection.

In the PAWS mechanism, the "timestamps" are 32-bit unsigned integers in a modular 32-bit space. Thus, "less than" is defined the same way it is for TCP sequence numbers, and the same implementation techniques apply. If s and t are timestamp values,

                   s < t  if 0 < (t - s) < 2^31,

computed in unsigned 32-bit arithmetic.

The choice of incoming timestamps to be saved for this comparison MUST guarantee a value that is monotonically non-decreasing. For example, an implementation might save the timestamp from the segment that last advanced the left edge of the receive window, i.e., the most recent in-sequence segment. For simplicity, the value TS.Recent introduced in Section 4.3 is used instead, as using a common value for both PAWS and RTTM simplifies the implementation. As Section 4.3 explained, TS.Recent differs from the timestamp from the last in- sequence segment only in the case of delayed <ACK>s, and therefore by less than one window. Either choice will, therefore, protect against sequence number wrap-around.

PAWS submits all incoming segments to the same test, and therefore protects against duplicate <ACK> segments as well as data segments. (An alternative non-symmetric algorithm would protect against old duplicate <ACK>s: the sender of data would reject incoming <ACK> segments whose TSecr values were less than the TSecr saved from the

last segment whose ACK field advanced the left edge of the send window. This algorithm was deemed to lack economy of mechanism and symmetry.)

TSval timestamps sent on <SYN> and <SYN,ACK> segments are used to initialize PAWS. PAWS protects against old duplicate non-<SYN> segments and duplicate <SYN> segments received while there is a synchronized connection. Duplicate <SYN> and <SYN,ACK> segments received when there is no connection will be discarded by the normal 3-way handshake and sequence number checks of TCP.

RFC1323 recommended that <RST> segments NOT carry timestamps and that they be acceptable regardless of their timestamp. At that time, the thinking was that old duplicate <RST> segments should be exceedingly unlikely, and their cleanup function should take precedence over timestamps. More recently, discussions about various blind attacks on TCP connections have raised the suggestion that if the Timestamps option is present, SEG.TSecr could be used to provide stricter acceptance tests for <RST> segments.

While still under discussion, to enable research into this area it is now RECOMMENDED that when generating an <RST>, if the segment causing the <RST> to be generated contains a Timestamps option, the <RST> should also contain a Timestamps option. In the <RST> segment, SEG.TSecr SHOULD be set to SEG.TSval from the incoming segment and SEG.TSval SHOULD be set to zero. If an <RST> is being generated because of a user abort, and Snd.TS.OK is set, then a Timestamps option SHOULD be included in the <RST>. When an <RST> segment is received, it MUST NOT be subjected to the PAWS check by verifying an acceptable value in SEG.TSval, and information from the Timestamps option MUST NOT be used to update connection state information. SEG.TSecr MAY be used to provide stricter <RST> acceptance checks.

Basic PAWS Algorithm

If the PAWS algorithm is used, the following processing MUST be performed on all incoming segments for a synchronized connection. Also, PAWS processing MUST take precedence over the regular TCP acceptability check (Section 3.3 in RFC0793), which is performed after verification of the received Timestamps option:

R1) If there is a Timestamps option in the arriving segment,

    SEG.TSval < TS.Recent, TS.Recent is valid (see later
    discussion), and if the RST bit is not set, then treat the
    arriving segment as not acceptable:

       Send an acknowledgment in reply as specified in Section 3.9
       of RFC0793, page 69, and drop the segment.

       Note: it is necessary to send an <ACK> segment in order to
       retain TCP's mechanisms for detecting and recovering from
       half-open connections.  For an example, see Figure 10 of
       RFC0793.

R2) If the segment is outside the window, reject it (normal TCP

    processing).

R3) If an arriving segment satisfies SEG.TSval >= TS.Recent and

    SEG.SEQ <= Last.ACK.sent (see Section 4.3), then record its
    timestamp in TS.Recent.

R4) If an arriving segment is in sequence (i.e., at the left window

    edge), then accept it normally.

R5) Otherwise, treat the segment as a normal in-window,

    out-of-sequence TCP segment (e.g., queue it for later delivery
    to the user).

Steps R2, R4, and R5 are the normal TCP processing steps specified by RFC0793.

It is important to note that the timestamp MUST be checked only when a segment first arrives at the receiver, regardless of whether it is in sequence or it must be queued for later delivery.

Consider the following example.

  Suppose the segment sequence: A.1, B.1, C.1, ..., Z.1 has been
  sent, where the letter indicates the sequence number and the digit
  represents the timestamp.  Suppose also that segment B.1 has been
  lost.  The timestamp in TS.Recent is 1 (from A.1), so C.1, ...,
  Z.1 are considered acceptable and are queued.  When B is
  retransmitted as segment B.2 (using the latest timestamp), it
  fills the hole and causes all the segments through Z to be
  acknowledged and passed to the user.  The timestamps of the queued
  segments are *not* inspected again at this time, since they have
  already been accepted.  When B.2 is accepted, TS.Recent is set to
  2.

This rule allows reasonable performance under loss. A full window of data is in transit at all times, and after a loss a full window less one segment will show up out of sequence to be queued at the receiver (e.g., up to ~2^30 bytes of data); the Timestamps option must not result in discarding this data.

In certain unlikely circumstances, the algorithm of rules R1-R5 could lead to discarding some segments unnecessarily, as shown in the following example:

  Suppose again that segments: A.1, B.1, C.1, ..., Z.1 have been
  sent in sequence and that segment B.1 has been lost.  Furthermore,
  suppose delivery of some of C.1, ... Z.1 is delayed until *after*
  the retransmission B.2 arrives at the receiver.  These delayed
  segments will be discarded unnecessarily when they do arrive,
  since their timestamps are now out of date.

This case is very unlikely to occur. If the retransmission was triggered by a timeout, some of the segments C.1, ... Z.1 must have been delayed longer than the RTO time. This is presumably an unlikely event, or there would be many spurious timeouts and retransmissions. If B's retransmission was triggered by the "Fast Retransmit" algorithm, i.e., by duplicate <ACK>s, then the queued segments that caused these <ACK>s must have been received already.

Even if a segment were delayed past the RTO, the Fast Retransmit mechanism [Jacobson90c] will cause the delayed segments to be retransmitted at the same time as B.2, avoiding an extra RTT and, therefore, causing a very small performance penalty.

We know of no case with a significant probability of occurrence in which timestamps will cause performance degradation by unnecessarily discarding segments.

Timestamp Clock

It is important to understand that the PAWS algorithm does not require clock synchronization between the sender and receiver. The sender's timestamp clock is used as a source of monotonic non- decreasing values to stamp the segments. The receiver treats the timestamp value as simply a monotonically non-decreasing serial number, without any connection to time. From the receiver's viewpoint, the timestamp is acting as a logical extension of the high-order bits of the sequence number.

The receiver algorithm does place some requirements on the frequency of the timestamp clock.

(a) The timestamp clock must not be "too slow".

    It MUST tick at least once for each 2^31 bytes sent.  In fact,
    in order to be useful to the sender for round-trip timing, the
    clock SHOULD tick at least once per window's worth of data, and
    even with the window extension defined in Section 2.2, 2^31
    bytes must be at least two windows.

    To make this more quantitative, any clock faster than 1 tick/sec
    will reject old duplicate segments for link speeds of ~8 Gbps.
    A 1 ms timestamp clock will work at link speeds up to 8 Tbps
    (8*10^12) bps!

(b) The timestamp clock must not be "too fast".

    The recycling time of the timestamp clock MUST be greater than
    MSL seconds.  Since the clock (timestamp) is 32 bits and the
    worst-case MSL is 255 seconds, the maximum acceptable clock
    frequency is one tick every 59 ns.

    However, it is desirable to establish a much longer recycle
    period, in order to handle outdated timestamps on idle
    connections (see Section 5.5), and to relax the MSL requirement
    for preventing sequence number wrap-around.  With a 1 ms
    timestamp clock, the 32-bit timestamp will wrap its sign bit in
    24.8 days.  Thus, it will reject old duplicates on the same
    connection if MSL is 24.8 days or less.  This appears to be a
    very safe figure; an MSL of 24.8 days or longer can probably be
    assumed in the Internet without requiring precise MSL
    enforcement.

Based upon these considerations, we choose a timestamp clock frequency in the range 1 ms to 1 sec per tick. This range also matches the requirements of the RTTM mechanism, which does not need much more resolution than the granularity of the retransmit timer, e.g., tens or hundreds of milliseconds.

The PAWS mechanism also puts a strong monotonicity requirement on the sender's timestamp clock. The method of implementation of the timestamp clock to meet this requirement depends upon the system hardware and software.

o Some hosts have a hardware clock that is guaranteed to be

  monotonic between hardware resets.

o A clock interrupt may be used to simply increment a binary integer

  by 1 periodically.

o The timestamp clock may be derived from a system clock that is

  subject to being abruptly changed by adding a variable offset
  value.  This offset is initialized to zero.  When a new timestamp
  clock value is needed, the offset can be adjusted as necessary to
  make the new value equal to or larger than the previous value
  (which was saved for this purpose).

o A random offset may be added to the timestamp clock on a per-

  connection basis.  See RFC6528, Section 3, on randomizing the
  initial sequence number (ISN).  The same function with a different
  secret key can be used to generate the per-connection timestamp
  offset.

Outdated Timestamps

If a connection remains idle long enough for the timestamp clock of the other TCP to wrap its sign bit, then the value saved in TS.Recent will become too old; as a result, the PAWS mechanism will cause all subsequent segments to be rejected, freezing the connection (until the timestamp clock wraps its sign bit again).

With the chosen range of timestamp clock frequencies (1 sec to 1 ms), the time to wrap the sign bit will be between 24.8 days and 24800 days. A TCP connection that is idle for more than 24 days and then comes to life is exceedingly unusual. However, it is undesirable in principle to place any limitation on TCP connection lifetimes.

We therefore require that an implementation of PAWS include a mechanism to "invalidate" the TS.Recent value when a connection is idle for more than 24 days. (An alternative solution to the problem of outdated timestamps would be to send keep-alive segments at a very low rate, but still more often than the wrap-around time for timestamps, e.g., once a day. This would impose negligible overhead. However, the TCP specification has never included keep-alives, so the solution based upon invalidation was chosen.)

Note that a TCP does not know the frequency, and therefore the wrap- around time, of the other TCP, so it must assume the worst. The validity of TS.Recent needs to be checked only if the basic PAWS timestamp check fails, i.e., only if SEG.TSval < TS.Recent. If TS.Recent is found to be invalid, then the segment is accepted, regardless of the failure of the timestamp check, and rule R3 updates TS.Recent with the TSval from the new segment.

To detect how long the connection has been idle, the TCP MAY update a clock or timestamp value associated with the connection whenever TS.Recent is updated, for example. The details will be implementation dependent.

Header Prediction

"Header prediction" [Jacobson90a] is a high-performance transport protocol implementation technique that is most important for high- speed links. This technique optimizes the code for the most common case, receiving a segment correctly and in order. Using header prediction, the receiver asks the question, "Is this segment the next in sequence?" This question can be answered in fewer machine instructions than the question, "Is this segment within the window?"

Adding header prediction to our timestamp procedure leads to the following recommended sequence for processing an arriving TCP segment:

H1) Check timestamp (same as step R1 above).

H2) Do header prediction: if the segment is next in sequence and if

    there are no special conditions requiring additional processing,
    accept the segment, record its timestamp, and skip H3.

H3) Process the segment normally, as specified in RFC 793. This

    includes dropping segments that are outside the window and
    possibly sending acknowledgments, and queuing in-window,
    out-of-sequence segments.

Another possibility would be to interchange steps H1 and H2, i.e., to perform the header prediction step H2 *first*, and perform H1 and H3 only when header prediction fails. This could be a performance improvement, since the timestamp check in step H1 is very unlikely to fail, and it requires unsigned modulo arithmetic. To perform this check on every single segment is contrary to the philosophy of header prediction. We believe that this change might produce a measurable reduction in CPU time for TCP protocol processing on high-speed networks.

However, putting H2 first would create a hazard: a segment from 2^32 bytes in the past might arrive at exactly the wrong time and be accepted mistakenly by the header-prediction step. The following reasoning has been introduced in RFC1185 to show that the probability of this failure is negligible.

  If all segments are equally likely to show up as old duplicates,
  then the probability of an old duplicate exactly matching the left
  window edge is the maximum segment size (MSS) divided by the size
  of the sequence space.  This ratio must be less than 2^-16, since
  MSS must be < 2^16; for example, it will be (2^12)/(2^32) = 2^-20
  for [a 100 Mbit/s] link.  However, the older a segment is, the
  less likely it is to be retained in the Internet, and under any

  reasonable model of segment lifetime the probability of an old
  duplicate exactly at the left window edge must be much smaller
  than 2^-16.

  The 16 bit TCP checksum also allows a basic unreliability of one
  part in 2^16.  A protocol mechanism whose reliability exceeds the
  reliability of the TCP checksum should be considered "good
  enough", i.e., it won't contribute significantly to the overall
  error rate.  We therefore believe we can ignore the problem of an
  old duplicate being accepted by doing header prediction before
  checking the timestamp.  [Note: the notation for exponentiation
  has been changed from how it appeared in RFC 1185.]

However, this probabilistic argument is not universally accepted, and the consensus at present is that the performance gain does not justify the hazard in the general case. It is therefore recommended that H2 follow H1.

IP Fragmentation

At high data rates, the protection against old segments provided by PAWS can be circumvented by errors in IP fragment reassembly (see RFC4963). The only way to protect against incorrect IP fragment reassembly is to not allow the segments to be fragmented. This is done by setting the Don't Fragment (DF) bit in the IP header.

Setting the DF bit implies the use of Path MTU Discovery as described in RFC1191, RFC1981, and RFC4821; thus, any TCP implementation that implements PAWS MUST also implement Path MTU Discovery.

Duplicates from Earlier Incarnations of Connection

The PAWS mechanism protects against errors due to sequence number wrap-around on high-speed connections. Segments from an earlier incarnation of the same connection are also a potential cause of old duplicate errors. In both cases, the TCP mechanisms to prevent such errors depend upon the enforcement of an MSL by the Internet (IP) layer (see the Appendix of RFC 1185 for a detailed discussion). Unlike the case of sequence space wrap-around, the MSL required to prevent old duplicate errors from earlier incarnations does not depend upon the transfer rate. If the IP layer enforces the recommended 2-minute MSL of TCP, and if the TCP rules are followed, TCP connections will be safe from earlier incarnations, no matter how high the network speed. Thus, the PAWS mechanism is not required for this case.

We may still ask whether the PAWS mechanism can provide additional security against old duplicates from earlier connections, allowing us to relax the enforcement of MSL by the IP layer. Appendix B explores this question, showing that further assumptions and/or mechanisms are required, beyond those of PAWS. This is not part of the current extension.

Conclusions and Acknowledgments

This memo presented a set of extensions to TCP to provide efficient operation over large bandwidth * delay product paths and reliable operation over very high-speed paths. These extensions are designed to provide compatible interworking with TCP stacks that do not implement the extensions.

These mechanisms are implemented using TCP options for scaled windows and timestamps. The timestamps are used for two distinct mechanisms: RTTM and PAWS.

The Window Scale option was originally suggested by Mike St. Johns of USAF/DCA. The present form of the option was suggested by Mike Karels of UC Berkeley in response to a more cumbersome scheme defined by Van Jacobson. Lixia Zhang helped formulate the PAWS mechanism description in RFC1185.

Finally, much of this work originated as the result of discussions within the End-to-End Task Force on the theoretical limitations of transport protocols in general and TCP in particular. Task force members and others on the end2end-interest list have made valuable contributions by pointing out flaws in the algorithms and the documentation. Continued discussion and development since the publication of RFC1323 originally occurred in the IETF TCP Large Windows Working Group, later on in the End-to-End Task Force, and most recently in the IETF TCP Maintenance Working Group. The authors are grateful for all these contributions.

Security Considerations

The TCP sequence space is a fixed size, and as the window becomes larger, it becomes easier for an attacker to generate forged packets that can fall within the TCP window and be accepted as valid segments. While use of timestamps and PAWS can help to mitigate this, when using PAWS, if an attacker is able to forge a packet that is acceptable to the TCP connection, a timestamp that is in the future would cause valid segments to be dropped due to PAWS checks. Hence, implementers should take care to not open the TCP window drastically beyond the requirements of the connection.

See RFC5961 for mitigation strategies to blind in-window attacks.

A naive implementation that derives the timestamp clock value directly from a system uptime clock may unintentionally leak this information to an attacker. This does not directly compromise any of the mechanisms described in this document. However, this may be valuable information to a potential attacker. It is therefore RECOMMENDED to generate a random, per-connection offset to be used with the clock source when generating the Timestamps option value (see Section 5.4). By carefully choosing this random offset, further improvements as described in RFC6191 are possible.

Expanding the TCP window beyond 64 KiB for IPv6 allows Jumbograms RFC2675 to be used when the local network supports packets larger than 64 KiB. When larger TCP segments are used, the TCP checksum becomes weaker.

Mechanisms to protect the TCP header from modification should also protect the TCP options.

Middleboxes and TCP options:

  Some middleboxes have been known to remove the TCP options
  described in this document from TCP segments [Honda11].
  Middleboxes that remove TCP options described in this document
  from the <SYN> segment interfere with the selection of parameters
  appropriate for the session.  Removing any of these options in a
  <SYN,ACK> segment will leave the end hosts in a state that
  destroys the proper operation of the protocol.

  *  If a Window Scale option is removed from a <SYN,ACK> segment,
     the end hosts will not negotiate the window scaling factor
     correctly.  Middleboxes must not remove or modify the Window
     Scale option from <SYN,ACK> segments.

  *  If a stateful firewall uses the window field to detect whether
     a received segment is inside the current window, and does not
     support the Window Scale option, it will not be able to
     correctly determine whether or not a packet is in the window.
     These middle boxes must also support the Window Scale option
     and apply the scale factor when processing segments.  If the
     window scale factor cannot be determined, it must not do
     window-based processing.

  *  If the Timestamps option is removed from the <SYN> or <SYN,ACK>
     segments, high speed connections that need PAWS would not have
     that protection.  Successful negotiation of the Timestamps
     option enforces a stricter verification of incoming segments at
     the receiver.  If the Timestamps option was removed from a
     subsequent data segment after a successful negotiation (e.g.,
     as part of resegmentation), the segment is discarded by the
     receiver without further processing.  Middleboxes should not
     remove the Timestamps option.

  *  It must be noted that RFC1323 doesn't address the case of the
     Timestamps option being dropped or selectively omitted after
     being negotiated, and that the update in this document may
     cause some broken middlebox behavior to be detected
     (potentially unresponsive TCP sessions).

Implementations that depend on PAWS could provide a mechanism for the application to determine whether or not PAWS is in use on the connection and choose to terminate the connection if that protection doesn't exist. This is not just to protect the connection against middleboxes that might remove the Timestamps option, but also against remote hosts that do not have Timestamp support.

Privacy Considerations

The TCP options described in this document do not expose individual user's data. However, a naive implementation simply using the system clock as a source for the Timestamps option will reveal characteristics of the TCP, potentially allowing more targeted attacks. It is therefore RECOMMENDED to generate a random, per- connection offset to be used with the clock source when generating the Timestamps option value (see Section 5.4).

Furthermore, the combination, relative ordering, and padding of the TCP options described in Sections 2.2 and 3.2 will reveal additional clues to allow the fingerprinting of the system.

IANA Considerations

The described TCP options are well known from the superceded RFC1323. IANA has updated the "TCP Option Kind Numbers" table under "TCP Parameters" to list this document (RFC 7323) as the reference for "Window Scale" and "Timestamps".

References

Normative References

RFC793 Postel, J., "Transmission Control Protocol", STD 7, RFC

          793, September 1981.

RFC1191 Mogul, J. and S. Deering, "Path MTU discovery", RFC 1191,

          November 1990.

RFC2119 Bradner, S., "Key words for use in RFCs to Indicate

          Requirement Levels", BCP 14, RFC 2119, March 1997.

Informative References

[Allman99] Allman, M. and V. Paxson, "On Estimating End-to-End

          Network Path Properties", Proceedings of the ACM SIGCOMM
          Technical Symposium, Cambridge, MA, September 1999,
          <http://aciri.org/mallman/papers/estimation-la.pdf>.

[Floyd05] Floyd, S., "Subject: Re: [tcpm] RFC 1323: Timestamps

          option", message to the TCPM mailing list, 26 January
          2007, <http://www.ietf.org/mail-archive/web/tcpm/current/
          msg02508.html>.

[Garlick77]

          Garlick, L., Rom, R., and J. Postel, "Issues in Reliable
          Host-to-Host Protocols", Proceedings of the Second
          Berkeley Workshop on Distributed Data Management and
          Computer Networks, March 1977,
          <http://www.rfc-editor.org/ien/ien12.txt>.

[Honda11] Honda, M., Nishida, Y., Raiciu, C., Greenhalgh, A.,

          Handley, M., and H. Tokuda, "Is it Still Possible to
          Extend TCP?", Proceedings of the ACM Internet Measurement
          Conference (IMC) '11, November 2011.

[Jacobson88a]

          Jacobson, V., "Congestion Avoidance and Control", SIGCOMM
          '88, Stanford, CA, August 1988,
          <http://ee.lbl.gov/papers/congavoid.pdf>.

[Jacobson90a]

          Jacobson, V., "4BSD Header Prediction", ACM Computer
          Communication Review, April 1990.

[Jacobson90c]

          Jacobson, V., "Subject: modified TCP congestion avoidance
          algorithm", message to the End2End-Interest mailing list,
          30 April 1990, <ftp://ftp.isi.edu/end2end/
          end2end-interest-1990.mail>.

[Karn87] Karn, P. and C. Partridge, "Estimating Round-Trip Times in

          Reliable Transport Protocols", Proceedings of SIGCOMM '87,
          August 1987.

[Kuehlewind10]

          Kuehlewind, M. and B. Briscoe, "Chirping for Congestion
          Control - Implementation Feasibility", November 2010,
          <http://bobbriscoe.net/projects/netsvc_i-f/
          chirp_pfldnet10.pdf>.

[Kuzmanovic03]

          Kuzmanovic, A. and E. Knightly, "TCP-LP: Low-Priority
          Service via End-Point Congestion Control", 2003,
          <www.cs.northwestern.edu/~akuzma/doc/TCP-LP-ToN.pdf>.

[Ludwig00] Ludwig, R. and K. Sklower, "The Eifel Retransmission

          Timer", ACM SIGCOMM Computer Communication Review Volume
          30 Issue 3, July 2000,
          <http://ccr.sigcomm.org/archive/2000/july00/
          LudwigFinal.pdf>.

[Martin03] Martin, D., "Subject: [Tsvwg] RFC 1323.bis", message to

          the TSVWG mailing list, 30 September 2003,
          <http://www.ietf.org/mail-archive/web/tsvwg/current/
          msg04435.html>.

[Medina04] Medina, A., Allman, M., and S. Floyd, "Measuring

          Interactions Between Transport Protocols and Middleboxes",
          Proceedings of the ACM SIGCOMM/USENIX Internet Measurement
          Conference, October 2004,
          <http://www.icir.net/tbit/tbit-Aug2004.pdf>.

[Medina05] Medina, A., Allman, M., and S. Floyd, "Measuring the

          Evolution of Transport Protocols in the Internet", ACM
          Computer Communication Review Volume 35, No. 2, April
          2005,
          <http://icir.net/floyd/papers/TCPevolution-Mar2005.pdf>.

[RE-1323BIS]

          Oppermann, A., "Subject: Re: [tcpm] I-D Action: draft-
          ietf.tcpm-1323bis-13.txt", message to the TCPM mailing
          list, 01 June 2013, <http://www.ietf.org/
          mail-archive/web/tcpm/current/msg08001.html>.

RFC1072 Jacobson, V. and R. Braden, "TCP extensions for long-delay

          paths", RFC 1072, October 1988.

RFC1122 Braden, R., "Requirements for Internet Hosts -

          Communication Layers", STD 3, RFC 1122, October 1989.

RFC1185 Jacobson, V., Braden, B., and L. Zhang, "TCP Extension for

          High-Speed Paths", RFC 1185, October 1990.

RFC1323 Jacobson, V., Braden, B., and D. Borman, "TCP Extensions

          for High Performance", RFC 1323, May 1992.

RFC1981 McCann, J., Deering, S., and J. Mogul, "Path MTU Discovery

          for IP version 6", RFC 1981, August 1996.

RFC2018 Mathis, M., Mahdavi, J., Floyd, S., and A. Romanow, "TCP

          Selective Acknowledgment Options", RFC 2018, October 1996.

RFC2675 Borman, D., Deering, S., and R. Hinden, "IPv6 Jumbograms",

          RFC 2675, August 1999.

RFC2883 Floyd, S., Mahdavi, J., Mathis, M., and M. Podolsky, "An

          Extension to the Selective Acknowledgement (SACK) Option
          for TCP", RFC 2883, July 2000.

RFC3522 Ludwig, R. and M. Meyer, "The Eifel Detection Algorithm

          for TCP", RFC 3522, April 2003.

RFC4015 Ludwig, R. and A. Gurtov, "The Eifel Response Algorithm

          for TCP", RFC 4015, February 2005.

RFC4821 Mathis, M. and J. Heffner, "Packetization Layer Path MTU

          Discovery", RFC 4821, March 2007.

RFC4963 Heffner, J., Mathis, M., and B. Chandler, "IPv4 Reassembly

          Errors at High Data Rates", RFC 4963, July 2007.

RFC5681 Allman, M., Paxson, V., and E. Blanton, "TCP Congestion

          Control", RFC 5681, September 2009.

RFC5961 Ramaiah, A., Stewart, R., and M. Dalal, "Improving TCP's

          Robustness to Blind In-Window Attacks", RFC 5961, August
          2010.

RFC6191 Gont, F., "Reducing the TIME-WAIT State Using TCP

          Timestamps", BCP 159, RFC 6191, April 2011.

RFC6298 Paxson, V., Allman, M., Chu, J., and M. Sargent,

          "Computing TCP's Retransmission Timer", RFC 6298, June
          2011.

RFC6528 Gont, F. and S. Bellovin, "Defending against Sequence

          Number Attacks", RFC 6528, February 2012.

RFC6675 Blanton, E., Allman, M., Wang, L., Jarvinen, I., Kojo, M.,

          and Y. Nishida, "A Conservative Loss Recovery Algorithm
          Based on Selective Acknowledgment (SACK) for TCP", RFC
          6675, August 2012.

RFC6691 Borman, D., "TCP Options and Maximum Segment Size (MSS)",

          RFC 6691, July 2012.

RFC6817 Shalunov, S., Hazel, G., Iyengar, J., and M. Kuehlewind,

          "Low Extra Delay Background Transport (LEDBAT)", RFC 6817,
          December 2012.

Appendix A. Implementation Suggestions

TCP Option Layout

  The following layout is recommended for sending options on
  non-<SYN> segments to achieve maximum feasible alignment of 32-bit
  and 64-bit machines.

               +--------+--------+--------+--------+
               |   NOP  |  NOP   |  TSopt |   10   |
               +--------+--------+--------+--------+
               |          TSval timestamp          |
               +--------+--------+--------+--------+
               |          TSecr timestamp          |
               +--------+--------+--------+--------+

Interaction with the TCP Urgent Pointer

  The TCP Urgent Pointer, like the TCP window, is a 16-bit value.
  Some of the original discussion for the TCP Window Scale option
  included proposals to increase the Urgent Pointer to 32 bits.  As
  it turns out, this is unnecessary.  There are two observations
  that should be made:

  (1)  With IP version 4, the largest amount of TCP data that can be
       sent in a single packet is 65495 bytes (64 KiB - 1 - size of
       fixed IP and TCP headers).

  (2)  Updates to the Urgent Pointer while the user is in "urgent
       mode" are invisible to the user.

  This means that if the Urgent Pointer points beyond the end of the
  TCP data in the current segment, then the user will remain in
  urgent mode until the next TCP segment arrives.  That segment will
  update the Urgent Pointer to a new offset, and the user will never
  have left urgent mode.

  Thus, to properly implement the Urgent Pointer, the sending TCP
  only has to check for overflow of the 16-bit Urgent Pointer field
  before filling it in.  If it does overflow, than a value of 65535
  should be inserted into the Urgent Pointer.

  The same technique applies to IP version 6, except in the case of
  IPv6 Jumbograms.  When IPv6 Jumbograms are supported, RFC2675
  requires additional steps for dealing with the Urgent Pointer;
  these steps are described in Section 5.2 of RFC2675.

Appendix B. Duplicates from Earlier Connection Incarnations

There are two cases to be considered: (1) a system crashing (and losing connection state) and restarting, and (2) the same connection being closed and reopened without a loss of host state. These will be described in the following two sections.

B.1. System Crash with Loss of State

TCP's quiet time of one MSL upon system startup handles the loss of connection state in a system crash/restart. For an explanation, see, for example, "Knowing When to Keep Quiet" in the TCP protocol specification RFC0793. The MSL that is required here does not depend upon the transfer speed. The current TCP MSL of 2 minutes seemed acceptable as an operational compromise, when many host systems used to take this long to boot after a crash. Current host systems can boot considerably faster.

The Timestamps option may be used to ease the MSL requirements (or to provide additional security against data corruption). If timestamps are being used and if the timestamp clock can be guaranteed to be monotonic over a system crash/restart, i.e., if the first value of the sender's timestamp clock after a crash/restart can be guaranteed to be greater than the last value before the restart, then a quiet time is unnecessary.

To dispense totally with the quiet time would require that the host clock be synchronized to a time source that is stable over the crash/ restart period, with an accuracy of one timestamp clock tick or better. We can back off from this strict requirement to take advantage of approximate clock synchronization. Suppose that the clock is always resynchronized to within N timestamp clock ticks and that booting (extended with a quiet time, if necessary) takes more than N ticks. This will guarantee monotonicity of the timestamps, which can then be used to reject old duplicates even without an enforced MSL.

B.2. Closing and Reopening a Connection

When a TCP connection is closed, a delay of 2*MSL in TIME-WAIT state ties up the socket pair for 4 minutes (see Section 3.5 of RFC0793). Applications built upon TCP that close one connection and open a new one (e.g., an FTP data transfer connection using Stream mode) must choose a new socket pair each time. The TIME-WAIT delay serves two different purposes:

(a) Implement the full-duplex reliable close handshake of TCP.

    The proper time to delay the final close step is not really
    related to the MSL; it depends instead upon the RTO for the FIN
    segments and, therefore, upon the RTT of the path.  (It could be
    argued that the side that is sending a FIN knows what degree of
    reliability it needs, and therefore it should be able to
    determine the length of the TIME-WAIT delay for the FIN's
    recipient.  This could be accomplished with an appropriate TCP
    option in FIN segments.)

    Although there is no formal upper bound on RTT, common network
    engineering practice makes an RTT greater than 1 minute very
    unlikely.  Thus, the 4-minute delay in TIME-WAIT state works
    satisfactorily to provide a reliable full-duplex TCP close.
    Note again that this is independent of MSL enforcement and
    network speed.

    The TIME-WAIT state could cause an indirect performance problem
    if an application needed to repeatedly close one connection and
    open another at a very high frequency, since the number of
    available TCP ports on a host is less than 2^16.  However, high
    network speeds are not the major contributor to this problem;
    the RTT is the limiting factor in how quickly connections can be
    opened and closed.  Therefore, this problem will be no worse at
    high transfer speeds.

(b) Allow old duplicate segments to expire.

    To replace this function of TIME-WAIT state, a mechanism would
    have to operate across connections.  PAWS is defined strictly
    within a single connection; the last timestamp (TS.Recent) is
    kept in the connection control block and discarded when a
    connection is closed.

    An additional mechanism could be added to the TCP, a per-host
    cache of the last timestamp received from any connection.  This
    value could then be used in the PAWS mechanism to reject old
    duplicate segments from earlier incarnations of the connection,
    if the timestamp clock can be guaranteed to have ticked at least
    once since the old connection was open.  This would require that
    the TIME-WAIT delay plus the RTT together must be at least one
    tick of the sender's timestamp clock.  Such an extension is not
    part of the proposal of this RFC.

    Note that this is a variant on the mechanism proposed by
    Garlick, Rom, and Postel [Garlick77], which required each host
    to maintain connection records containing the highest sequence

    numbers on every connection.  Using timestamps instead, it is
    only necessary to keep one quantity per remote host, regardless
    of the number of simultaneous connections to that host.

Appendix C. Summary of Notation

The following notation has been used in this document.

Options

  WSopt:            TCP Window Scale option
  TSopt:            TCP Timestamps option

Option Fields

  shift.cnt:        Window scale byte in WSopt
  TSval:            32-bit Timestamp Value field in TSopt
  TSecr:            32-bit Timestamp Reply field in TSopt

Option Fields in Current Segment

  SEG.TSval:        TSval field from TSopt in current segment
  SEG.TSecr:        TSecr field from TSopt in current segment
  SEG.WSopt:        8-bit value in WSopt

Clock Values

  my.TSclock:       System-wide source of 32-bit timestamp values
  my.TSclock.rate:  Period of my.TSclock (1 ms to 1 sec)
  Snd.TSoffset:     An offset for randomizing Snd.TSclock
  Snd.TSclock:      my.TSclock + Snd.TSoffset

Per-Connection State Variables

  TS.Recent:        Latest received Timestamp
  Last.ACK.sent:    Last ACK field sent
  Snd.TS.OK:        1-bit flag
  Snd.WS.OK:        1-bit flag
  Rcv.Wind.Shift:   Receive window scale exponent
  Snd.Wind.Shift:   Send window scale exponent
  Start.Time:       Snd.TSclock value when the segment being timed
                    was sent (used by code from before RFC 1323).

Procedure

  Update_SRTT(m)    Procedure to update the smoothed RTT and RTT
                    variance estimates, using the rules of
                    [Jacobson88a], given m, a new RTT measurement

Send Sequence Variables

  SND.UNA:          Send unacknowledged
  SND.NXT:          Send next
  SND.WND:          Send window
  ISS:              Initial send sequence number

Receive Sequence Variables

  RCV.NXT:          Receive next
  RCV.WND:          Receive window
  IRS:              Initial receive sequence number

Appendix D. Event Processing Summary

This appendix attempts to specify the algorithms unambiguously by presenting modifications to the Event Processing rules in Section 3.9 of RFC 793. The change bars ("|") indicate lines that are different from RFC 793.

OPEN Call

  ...

  An initial send sequence number (ISS) is selected.  Send a <SYN>
|    segment of the form:
|
|      <SEQ=ISS><CTL=SYN><TSval=Snd.TSclock><WSopt=Rcv.Wind.Shift>

  ...

SEND Call

  CLOSED STATE (i.e., TCB does not exist)

     ...

  LISTEN STATE

     If active and the foreign socket is specified, then change the
     connection from passive to active, select an ISS.  Send a SYN
|       segment containing the options: <TSval=Snd.TSclock> and
|       <WSopt=Rcv.Wind.Shift>.  Set SND.UNA to ISS, SND.NXT to ISS+1.
     Enter SYN-SENT state.  ...

  SYN-SENT STATE
  SYN-RECEIVED STATE

     ...

  ESTABLISHED STATE
  CLOSE-WAIT STATE

     Segmentize the buffer and send it with a piggybacked
     acknowledgment (acknowledgment value = RCV.NXT).  ...

     If the urgent flag is set ...

|       If the Snd.TS.OK flag is set, then include the TCP Timestamps
|       option <TSval=Snd.TSclock,TSecr=TS.Recent> in each data
|       segment.
|
|       Scale the receive window for transmission in the segment
|       header:
|
|               SEG.WND = (RCV.WND >> Rcv.Wind.Shift).

SEGMENT ARRIVES

  ...

  If the state is LISTEN then

     first check for an RST

        ...

     second check for an ACK

        ...

     third check for a SYN

        If the SYN bit is set, check the security.  If the ...

           ...

        If the SEG.PRC is less than the TCB.PRC then continue.

|          Check for a Window Scale option (WSopt); if one is found,
|          save SEG.WSopt in Snd.Wind.Shift and set Snd.WS.OK flag on.
|          Otherwise, set both Snd.Wind.Shift and Rcv.Wind.Shift to
|          zero and clear Snd.WS.OK flag.
|
|          Check for a TSopt option; if one is found, save SEG.TSval in
|          the variable TS.Recent and turn on the Snd.TS.OK bit.

        Set RCV.NXT to SEG.SEQ+1, IRS is set to SEG.SEQ and any
        other control or text should be queued for processing later.
        ISS should be selected and a SYN segment sent of the form:

                <SEQ=ISS><ACK=RCV.NXT><CTL=SYN,ACK>

|           If the Snd.WS.OK bit is on, include a WSopt
|           <WSopt=Rcv.Wind.Shift> in this segment.  If the Snd.TS.OK
|           bit is on, include a TSopt <TSval=Snd.TSclock,
|           TSecr=TS.Recent> in this segment.  Last.ACK.sent is set to
|           RCV.NXT.

        SND.NXT is set to ISS+1 and SND.UNA to ISS.  The connection
        state should be changed to SYN-RECEIVED.  Note that any
        other incoming control or data (combined with SYN) will be
        processed in the SYN-RECEIVED state, but processing of SYN
        and ACK should not be repeated.  If the listen was not fully
        specified (i.e., the foreign socket was not fully
        specified), then the unspecified fields should be filled in
        now.

     fourth other text or control

        ...

  If the state is SYN-SENT then

     first check the ACK bit

        ...

     ...

     fourth check the SYN bit

        ...

        If the SYN bit is on and the security/compartment and
        precedence are acceptable then, RCV.NXT is set to SEG.SEQ+1,
        IRS is set to SEG.SEQ.  SND.UNA should be advanced to equal
        SEG.ACK (if there is an ACK), and any segments on the
        retransmission queue which are thereby acknowledged should
        be removed.

|          Check for a Window Scale option (WSopt); if it is found,
|          save SEG.WSopt in Snd.Wind.Shift; otherwise, set both
|          Snd.Wind.Shift and Rcv.Wind.Shift to zero.
|

|          Check for a TSopt option; if one is found, save SEG.TSval in
|          variable TS.Recent and turn on the Snd.TS.OK bit in the
|          connection control block.  If the ACK bit is set, use
|          Snd.TSclock - SEG.TSecr as the initial RTT estimate.

        If SND.UNA > ISS (our SYN has been ACKed), change the
        connection state to ESTABLISHED, form an <ACK> segment:

                <SEQ=SND.NXT><ACK=RCV.NXT><CTL=ACK>

|          and send it.  If the Snd.TS.OK bit is on, include a TSopt
|          option <TSval=Snd.TSclock,TSecr=TS.Recent> in this <ACK>
|          segment.  Last.ACK.sent is set to RCV.NXT.

        Data or controls that were queued for transmission may be
        included.  If there are other controls or text in the
        segment, then continue processing at the sixth step below
        where the URG bit is checked; otherwise, return.

        Otherwise, enter SYN-RECEIVED, form a <SYN,ACK> segment:

                <SEQ=ISS><ACK=RCV.NXT><CTL=SYN,ACK>

|          and send it.  If the Snd.TS.OK bit is on, include a TSopt
|          option <TSval=Snd.TSclock,TSecr=TS.Recent> in this segment.
|          If the Snd.WS.OK bit is on, include a WSopt option
|          <WSopt=Rcv.Wind.Shift> in this segment.  Last.ACK.sent is
|          set to RCV.NXT.

        If there are other controls or text in the segment, queue
        them for processing after the ESTABLISHED state has been
        reached, return.

     fifth, if neither of the SYN or RST bits is set then drop the
     segment and return.

  Otherwise

  first check the sequence number

     SYN-RECEIVED STATE
     ESTABLISHED STATE
     FIN-WAIT-1 STATE
     FIN-WAIT-2 STATE
     CLOSE-WAIT STATE
     CLOSING STATE
     LAST-ACK STATE
     TIME-WAIT STATE

        Segments are processed in sequence.  Initial tests on
        arrival are used to discard old duplicates, but further
        processing is done in SEG.SEQ order.  If a segment's
        contents straddle the boundary between old and new, only the
        new parts should be processed.

|          Rescale the received window field:
|
|                TrueWindow = SEG.WND << Snd.Wind.Shift,
|
|          and use "TrueWindow" in place of SEG.WND in the following
|          steps.
|
|          Check whether the segment contains a Timestamps option and
|          if bit Snd.TS.OK is on.  If so:
|
|             If SEG.TSval < TS.Recent and the RST bit is off:
|
|                If the connection has been idle more than 24 days,
|                save SEG.TSval in variable TS.Recent, else the segment
|                is not acceptable; follow the steps below for an
|                unacceptable segment.
|
|             If SEG.TSval >= TS.Recent and SEG.SEQ <= Last.ACK.sent,
|             then save SEG.TSval in variable TS.Recent.

        There are four cases for the acceptability test for an
        incoming segment:

           ...

        If an incoming segment is not acceptable, an acknowledgment
        should be sent in reply (unless the RST bit is set; if so
        drop the segment and return):

                <SEQ=SND.NXT><ACK=RCV.NXT><CTL=ACK>

|          Last.ACK.sent is set to SEG.ACK of the acknowledgment.  If
|          the Snd.TS.OK bit is on, include the Timestamps option
|          <TSval=Snd.TSclock,TSecr=TS.Recent> in this <ACK> segment.
        Set Last.ACK.sent to SEG.ACK and send the <ACK> segment.
        After sending the acknowledgment, drop the unacceptable
        segment and return.

  ...

  fifth check the ACK field,

     if the ACK bit is off drop the segment and return

     if the ACK bit is on

        ...

        ESTABLISHED STATE

           If SND.UNA < SEG.ACK <= SND.NXT then, set SND.UNA <-
|             SEG.ACK.  Also compute a new estimate of round-trip time.
|             If Snd.TS.OK bit is on, use Snd.TSclock - SEG.TSecr;
|             otherwise, use the elapsed time since the first segment
|             in the retransmission queue was sent.  Any segments on
           the retransmission queue that are thereby entirely
           acknowledged...

  ...

  seventh, process the segment text,

     ESTABLISHED STATE
     FIN-WAIT-1 STATE
     FIN-WAIT-2 STATE

        ...

        Send an acknowledgment of the form:

                <SEQ=SND.NXT><ACK=RCV.NXT><CTL=ACK>

|          If the Snd.TS.OK bit is on, include the Timestamps option
|          <TSval=Snd.TSclock,TSecr=TS.Recent> in this <ACK> segment.
|          Set Last.ACK.sent to SEG.ACK of the acknowledgment, and send
|          it.  This acknowledgment should be piggybacked on a segment
        being transmitted if possible without incurring undue delay.

        ...

Appendix E. Timestamps Edge Cases

While the rules laid out for when to calculate RTTM produce the correct results most of the time, there are some edge cases where an incorrect RTTM can be calculated. All of these situations involve the loss of segments. It is felt that these scenarios are rare, and that if they should happen, they will cause a single RTTM measurement to be inflated, which mitigates its effects on RTO calculations.

[Martin03] cites two similar cases when the returning <ACK> is lost, and before the retransmission timer fires, another returning <ACK> segment arrives, which acknowledges the data. In this case, the RTTM calculated will be inflated:

      clock
        tc=1   <A, TSval=1> ------------------->

        tc=2   (lost) <---- <ACK(A), TSecr=1, win=n>
            (RTTM would have been 1)

               (receive window opens, window update is sent)
        tc=5        <---- <ACK(A), TSecr=1, win=m>
               (RTTM is calculated at 4)

One thing to note about this situation is that it is somewhat bounded by RTO + RTT, limiting how far off the RTTM calculation will be. While more complex scenarios can be constructed that produce larger inflations (e.g., retransmissions are lost), those scenarios involve multiple segment losses, and the connection will have other more serious operational problems than using an inflated RTTM in the RTO calculation.

Appendix F. Window Retraction Example

Consider an established TCP connection using a scale factor of 128, Snd.Wind.Shift=7 and Rcv.Wind.Shift=7, that is running with a very small window because the receiver is bottlenecked and both ends are doing small reads and writes.

Consider the ACKs coming back:

SEG.ACK SEG.WIN computed SND.WIN receiver's actual window 1000 2 1256 1300

The sender writes 40 bytes and receiver ACKs:

1040 2 1296 1300

The sender writes 5 additional bytes and the receiver has a problem. Two choices:

1045 2 1301 1300 - BEYOND BUFFER

1045 1 1173 1300 - RETRACTED WINDOW

This is a general problem and can happen any time the sender does a write, which is smaller than the window scale factor.

In most stacks, it is at least partially obscured when the window size is larger than some small number of segments because the stacks prefer to announce windows that are an integral number of segments, rounded up to the next scale factor. This plus silly window suppression tends to cause less frequent, larger window updates. If the window was rounded down to a segment size, there is more opportunity to advance the window, the BEYOND BUFFER case above, rather than retracting it.

Appendix G. RTO Calculation Modification

Taking multiple RTT samples per window would shorten the history calculated by the RTO mechanism in RFC6298, and the below algorithm aims to maintain a similar history as originally intended by RFC6298.

It is roughly known how many samples a congestion window worth of data will yield, not accounting for ACK compression, and ACK losses. Such events will result in more history of the path being reflected in the final value for RTO, and are uncritical. This modification will ensure that a similar amount of time is taken into account for the RTO estimation, regardless of how many samples are taken per window:

  ExpectedSamples = ceiling(FlightSize / (SMSS * 2))

  alpha' = alpha / ExpectedSamples

  beta' = beta / ExpectedSamples

Note that the factor 2 in ExpectedSamples is due to "Delayed ACKs".

Instead of using alpha and beta in the algorithm of RFC6298, use alpha' and beta' instead:

  RTTVAR <- (1 - beta') * RTTVAR + beta' * |SRTT - R'|

  SRTT <- (1 - alpha') * SRTT + alpha' * R'

  (for each sample R')

Appendix H. Changes from RFC 1323

Several important updates and clarifications to the specification in RFC 1323 are made in this document. The technical changes are summarized below:

(a) A wrong reference to SND.WND was corrected to SEG.WND in

    Section 2.3.

(b) Section 2.4 was added describing the unavoidable window

    retraction issue and explicitly describing the mitigation steps
    necessary.

(c) In Section 3.2, the wording how the Timestamps option

    negotiation is to be performed was updated with RFC2119 wording.
    Further, a number of paragraphs were added to clarify the
    expected behavior with a compliant implementation using TSopt,
    as RFC 1323 left room for interpretation -- e.g., potential late
    enablement of TSopt.

(d) The description of which TSecr values can be used to update the

    measured RTT has been clarified.  Specifically, with timestamps,
    the Karn algorithm [Karn87] is disabled.  The Karn algorithm
    disables all RTT measurements during retransmission, since it is
    ambiguous whether the <ACK> is for the original segment, or the
    retransmitted segment.  With timestamps, that ambiguity is
    removed since the TSecr in the <ACK> will contain the TSval from
    whichever data segment made it to the destination.

(e) RTTM update processing explicitly excludes segments not updating

    SND.UNA.  The original text could be interpreted to allow taking
    RTT samples when SACK acknowledges some new, non-continuous
    data.

(f) In RFC 1323, Section 3.4, step (2) of the algorithm to control

    which timestamp is echoed was incorrect in two regards:

    (1)  It failed to update TS.Recent for a retransmitted segment
         that resulted from a lost <ACK>.

    (2)  It failed if SEG.LEN = 0.

    In the new algorithm, the case of SEG.TSval >= TS.Recent is
    included for consistency with the PAWS test.

(g) It is now recommended that the Timestamps option is included in

    <RST> segments if the incoming segment contained a Timestamps
    option.

(h) <RST> segments are explicitly excluded from PAWS processing.

(i) Added text to clarify the precedence between regular TCP

    RFC0793 and this document's Timestamps option / PAWS
    processing.  Discussion about combined acceptability checks are
    ongoing.

(j) Snd.TSoffset and Snd.TSclock variables have been added.

    Snd.TSclock is the sum of my.TSclock and Snd.TSoffset.  This
    allows the starting points for timestamp values to be randomized
    on a per-connection basis.  Setting Snd.TSoffset to zero yields
    the same results as RFC1323.  Text was added to guide
    implementers to the proper selection of these offsets, as
    entirely random offsets for each new connection will conflict
    with PAWS.

(k) Appendix A has been expanded with information about the TCP

    Urgent Pointer.  An earlier revision contained text around the
    TCP MSS option, which was split off into RFC6691.

(l) One correction was made to the Event Processing Summary in

    Appendix D.  In SEND CALL/ESTABLISHED STATE, RCV.WND is used to
    fill in the SEG.WND value, not SND.WND.

(m) Appendix G was added to exemplify how an RTO calculation might

    be updated to properly take the much higher RTT sampling
    frequency enabled by the Timestamps option into account.

Editorial changes to the document, that don't impact the implementation or function of the mechanisms described in this document, include:

(a) Removed much of the discussion in Section 1 to streamline the

    document.  However, detailed examples and discussions in
    Sections 2, 3, and 5 are kept as guidelines for implementers.

(b) Added short text that the use of WS increases the chances of

    sequence number wrap, thus the PAWS mechanism is required in
    certain environments.

(c) Removed references to "new" options, as the options were

    introduced in RFC1323 already.  Changed the text in
    Section 1.3 to specifically address TS and WS options.

(d) Section 1.4 was added for RFC2119 wording. Normative text was

    updated with the appropriate phrases.

(e) Added < > brackets to mark specific types of segments, and

    replaced most occurrences of "packet" with "segment", where TCP
    segments are referred to.

(f) Updated the text in Section 3 to take into account what has been

    learned since RFC1323.

(g) Removed some unused references.

(h) Removed the list of changes between RFC1323 and prior

    versions.  These changes are mentioned in Appendix C of
    RFC1323.

(i) Moved "Changes from RFC 1323" to the end of the appendices for

    easier lookup.  In addition, the entries were split into a
    technical and an editorial part, and sorted to roughly
    correspond with the sections in the text where they apply.

Authors' Addresses

David Borman Quantum Corporation Mendota Heights, MN 55120 USA

EMail: [email protected]

Bob Braden University of Southern California 4676 Admiralty Way Marina del Rey, CA 90292 USA

EMail: [email protected]

Van Jacobson Google, Inc. 1600 Amphitheatre Parkway Mountain View, CA 94043 USA

EMail: [email protected]

Richard Scheffenegger (editor) NetApp, Inc. Am Euro Platz 2 Vienna, 1120 Austria

EMail: [email protected]