Network Working Group V. Jacobson
Request for Comments: 1185 LBL
R. Braden
ISI
L. Zhang
PARC
October 1990
TCP Extension for High-Speed Paths
Status of This Memo
This memo describes an EXPerimental Protocol extension to TCP for the
Internet community, and requests discussion and suggestions for
improvements. Please refer to the current edition of the "IAB
Official Protocol Standards" for the standardization state and status
of this protocol. Distribution of this memo is unlimited.
Summary
This memo describes a small extension to TCP to support reliable
operation over very high-speed paths, using sender timestamps
transmitted using the TCP Echo option proposed in RFC-1072.
1. INTRODUCTION
TCP uses positive acknowledgments and retransmissions to provide
reliable end-to-end delivery over a full-duplex virtual circuit
called a connection [Postel81]. A connection is defined by its two
end points; each end point is a "socket", i.e., a (host,port) pair.
To protect against data corruption, TCP uses an end-to-end checksum.
Duplication and reordering are handled using a fine-grained sequence
number space, with each octet receiving a distinct sequence number.
The TCP protocol [Postel81] was designed to operate reliably over
almost any transmission medium regardless of transmission rate,
delay, corruption, duplication, or reordering of segments. In
practice, proper TCP implementations have demonstrated remarkable
robustness in adapting to a wide range of network characteristics.
For example, TCP implementations currently adapt to transfer rates in
the range of 100 bps to 10**7 bps and round-trip delays in the range
1 ms to 100 seconds.
However, the introduction of fiber optics is resulting in ever-higher
transmission speeds, and the fastest paths are moving out of the
domain for which TCP was originally engineered. This memo and RFC-
1072 [Jacobson88] propose modest extensions to TCP to extend the
domain of its application to higher speeds.
There is no one-line answer to the question: "How fast can TCP go?".
The issues are reliability and performance, and these depend upon the
round-trip delay and the maximum time that segments may be queued in
the Internet, as well as upon the transmission speed. We must think
through these relationships very carefully if we are to successfully
extend TCP's domain.
TCP performance depends not upon the transfer rate itself, but rather
upon the product of the transfer rate and the round-trip delay. This
"bandwidth*delay product" measures the amount of data that would
"fill the pipe"; it is the buffer space required at sender and
receiver to oBTain maximum throughput on the TCP connection over the
path. RFC-1072 proposed a set of TCP extensions to improve TCP
efficiency for "LFNs" (long fat networks), i.e., networks with large
bandwidth*delay products.
On the other hand, high transfer rate can threaten TCP reliability by
violating the assumptions behind the TCP mechanism for duplicate
detection and sequencing. The present memo specifies a solution for
this problem, extending TCP reliability to transfer rates well beyond
the foreseeable upper limit of bandwidth.
An especially serious kind of error may result from an accidental
reuse of TCP sequence numbers in data segments. Suppose that an "old
duplicate segment", e.g., a duplicate data segment that was delayed
in Internet queues, was delivered to the receiver at the wrong moment
so that its sequence numbers fell somewhere within the current
window. There would be no checksum failure to warn of the error, and
the result could be an undetected corruption of the data. Reception
of an old duplicate ACK segment at the transmitter could be only
slightly less serious: it is likely to lock up the connection so that
no further progress can be made and a RST is required to
resynchronize the two ends.
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, the 32-bit sequence space may be "wrapped"
(cycled) within the time that a segment may be delayed in
queues. Section 2 discusses this case and proposes a mechanism
to reject old duplicates on the current connection.
(2) Segment from an earlier connection incarnation
Suppose 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 sockets) 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. This case is discussed in Section 3.
TCP reliability depends upon the existence of a bound on the lifetime
of a segment: the "Maximum Segment Lifetime" or MSL. An MSL is
generally required by any reliable transport protocol, since every
sequence number field must be finite, and therefore any sequence
number may eventually be reused. In the Internet protocol suite, the
MSL bound is enforced by an IP-layer mechanism, the "Time-to-Live" or
TTL field.
Watson's Delta-T protocol [Watson81] includes network-layer
mechanisms for precise enforcement of an MSL. In contrast, the IP
mechanism for MSL enforcement is loosely defined and even more
loosely implemented in the Internet. Therefore, it is unwise to
depend upon active enforcement of MSL for TCP connections, and it is
unrealistic to imagine setting MSL's smaller than the current values
(e.g., 120 seconds specified for TCP). The timestamp algorithm
described in the following section gives a way out of this dilemma
for high-speed networks.
2. SEQUENCE NUMBER WRAP-AROUND
2.1 Background
Avoiding reuse of sequence numbers within the same connection is
simple in principle: enforce a segment lifetime shorter than the
time it takes to cycle the sequence space, whose size is
effectively 2**31.
More specifically, if the maximum effective bandwidth at which TCP
is able to transmit over a particular path is B bytes per second,
then the following constraint must be satisfied for error-free
operation:
2**31 / B > MSL (secs) [1]
The following table shows the value for Twrap = 2**31/B in
seconds, for some important values of the bandwidth B:
Network B*8 B Twrap
bits/sec bytes/sec secs
_______ _______ ______ ______
ARPANET 56kbps 7KBps 3*10**5 (~3.6 days)
DS1 1.5Mbps 190KBps 10**4 (~3 hours)
Ethernet 10Mbps 1.25MBps 1700 (~30 mins)
DS3 45Mbps 5.6MBps 380
FDDI 100Mbps 12.5MBps 170
Gigabit 1Gbps 125MBps 17
It is clear why wrap-around of the sequence space was not a
problem for 56kbps packet switching or even 10Mbps Ethernets. On
the other hand, at DS3 and FDDI speeds, Twrap is comparable to the
2 minute MSL assumed by the TCP specification [Postel81]. Moving
towards gigabit speeds, Twrap becomes too small for reliable
enforcement by the Internet TTL mechanism.
The 16-bit window field of TCP limits the effective bandwidth B to
2**16/RTT, where RTT is the round-trip time in seconds
[McKenzie89]. If the RTT is large enough, this limits B to a
value that meets the constraint [1] for a large MSL value. For
example, consider a transcontinental backbone with an RTT of 60ms
(set by the laws of physics). With the bandwidth*delay product
limited to 64KB by the TCP window size, B is then limited to
1.1MBps, no matter how high the theoretical transfer rate of the
path. This corresponds to cycling the sequence number space in
Twrap= 2000 secs, which is safe in today's Internet.
Based on this reasoning, an earlier RFC[McKenzie89] has cautioned
that expanding the TCP window space as proposed in RFC-1072 will
lead to sequence wrap-around and hence to possible data
corruption. We believe that this is mis-identifying the culprit,
which is not the larger window but rather the high bandwidth.
For example, consider a (very large) FDDI LAN with a diameter
of 10km. Using the speed of light, we can compute the RTT
across the ring as (2*10**4)/(3*10**8) = 67 microseconds, and
the delay*bandwidth product is then 833 bytes. A TCP
connection across this LAN using a window of only 833 bytes
will run at the full 100mbps and can wrap the sequence space
in about 3 minutes, very close to the MSL of TCP. Thus, high
speed alone can cause a reliability problem with sequence
number wrap-around, even without extended windows.
An "obvious" fix for the problem of cycling the sequence space is
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. However, the proposals for
making such a change while maintaining compatibility with current
TCP have tended towards complexity and ugliness.
This memo proposes a simple solution to the problem, using the TCP
echo options defined in RFC-1072. Section 2.2 which follows
describes the original use of these options to carry timestamps in
order to measure RTT accurately. Section 2.3 proposes a method of
using these same timestamps to reject old duplicate segments that
could corrupt an open TCP connection. Section 3 discusses the
application of this mechanism to avoiding old duplicates from
previous incarnations.
2.2 TCP Timestamps
RFC-1072 defined two TCP options, Echo and Echo Reply. Echo
carries a 32-bit number, and the receiver of the option must
return this same value to the source host in an Echo Reply option.
RFC-1072 furthermore describes the use of these options to contain
32-bit timestamps, for measuring the RTT. A TCP sending data
would include Echo options containing the current clock value.
The receiver would echo these timestamps in returning segments
(generally, ACK segments). The difference between a timestamp
from an Echo Reply option and the current time would then measure
the RTT at the sender.
This mechanism was designed to solve the following problem: almost
all TCP implementations base their RTT measurements on a sample of
only one packet per window. If we look at RTT estimation as a
signal processing problem (which it is), a data signal at some
frequency (the packet rate) is being sampled at a lower frequency
(the window rate). Unfortunately, this lower sampling frequency
violates Nyquist's criteria and may introduce "aliasing" artifacts
into the estimated RTT [Hamming77].
A good RTT estimator with a conservative retransmission timeout
calculation can tolerate the aliasing when the sampling frequency
is "close" to the data frequency. For example, with a window of
8 packets, the sample rate is 1/8 the data frequency -- less than
an order of magnitude different. However, when the window is tens
or hundreds of packets, the RTT estimator may be seriously in
error, resulting in spurious retransmissions.
A solution to the aliasing problem that actually simplifies the
sender substantially (since the RTT code is typically the single
biggest protocol cost for TCP) is as follows: the will sender
place a timestamp in each segment and the receiver will reflect
these timestamps back in ACK segments. Then a single subtract
gives the sender an accurate RTT measurement for every ACK segment
(which will correspond to every other data segment, with a
sensible receiver). RFC-1072 defined a timestamp echo option for
this purpose.
It is vitally important to use the timestamp echo option with big
windows; otherwise, the door is opened to some dangerous
instabilities due to aliasing. Furthermore, the option is
probably useful for all TCP's, since it simplifies the sender.
2.3 Avoiding Old Duplicate Segments
Timestamps carried from sender to receiver in TCP Echo options can
also be used to prevent data corruption caused by sequence number
wrap-around, as this section describes.
2.3.1 Basic Algorithm
Assume that every received TCP segment contains a timestamp.
The basic idea is that a segment received with a timestamp that
is earlier than the timestamp of the most recently accepted
segment can be discarded as an old duplicate. More
specifically, the following processing is to be performed on
normal incoming segments:
R1) If the timestamp in the arriving segment timestamp is less
than the timestamp of the most recently received in-
sequence segment, treat the arriving segment as not
acceptable:
If SEG.LEN > 0, send an acknowledgement in reply as
specified in RFC-793 page 69, and drop the segment;
otherwise, just silently drop the segment.*
_________________________
*Sending an ACK segment in reply is not strictly necessary, since the
case can only arise when a later in-order segment has already been
received. However, for consistency and simplicity, we suggest
treating a timestamp failure the same way TCP treats any other
unacceptable segment.
R2) If the segment is outside the window, reject it (normal
TCP processing)
R3) If an arriving segment is in-sequence (i.e, at the left
window edge), accept it normally and record its timestamp.
R4) 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 are the normal TCP processing steps specified by
RFC-793, except that in R3 the latest timestamp is set from
each in-sequence segment that is accepted. Thus, the latest
timestamp recorded at the receiver corresponds to the left edge
of the window and only advances when the left edge moves
[Jacobson88].
It is important to note that the timestamp is checked only when
a segment first arrives at the receiver, regardless of whether
it is in-sequence or is queued. 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 highest in-sequence
timestamp 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, the receivers's current timestamp is set to 2.
This rule is vital to allow reasonable performance under loss.
A full window of data is in transit at all times, and after a
loss a full window less one packet will show up out-of-sequence
to be queued at the receiver (e.g., up to ~2**30 bytes of
data); the timestamp option must not result in discarding this
data.
In certain unlikely circumstances, the algorithm of rules R1-R4
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 was delayed past the RTO, the selective
acknowledgment (SACK) facility of RFC-1072 will cause the
delayed packets 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.
2.3.2 Header Prediction
"Header prediction" [Jacobson90] is a high-performance
transport protocol implementation technique that is 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 sequence for processing an arriving TCP segment:
H1) Check timestamp (same as step R1 above)
H2) Do header prediction: if 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 queueing
in-window, out-of-sequence segments.
However, the timestamp check in step H1 is very unlikely to
fail, and it is a relatively expensive operation since it
requires interval arithmetic on a finite field. To perform
this check on every single segment seems like poor
implementation engineering, defeating the purpose of header
prediction. Therefore, we suggest that an implementor
interchange H1 and H2, i.e., perform header prediction FIRST,
performing H1 and H3 only if header prediction fails. We
believe that this change might gain 5-10% in performance on
high-speed networks.
This reordering does raise a theoretical hazard: a segment from
2**32 bytes in the past may arrive at exactly the wrong time
and be accepted mistakenly by the header-prediction step. We
make the following argument 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 an FDDI 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.
2.3.3 Timestamp Frequency
It is important to understand that the receiver algorithm for
timestamps does not involve clock synchronization with the
sender. The sender's clock is used to stamp the segments, and
the sender uses this fact to measure RTT's. However, the
receiver treats the timestamp as simply a monotone-increasing
serial number, without any necessary connection to its clock.
From the receiver's viewpoint, the timestamp is acting as a
logical extension of the high-order bits of the sequence
number.
However, the receiver algorithm dpes place some requirements on
the frequency of the timestamp "clock":
(a) 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 RFC-1072 window
extension, 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 ~2 Gbps; a 1ms clock will work up to link
speeds of 2 Tbps (10**12 bps!).
(b) Timestamp clock must not be "too fast".
Its cycling time 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, since the sender is using the timestamp for RTT
calculations, the timestamp doesn't need to have much more
resolution than the granularity of the retransmit timer,
e.g., tens or hundreds of milliseconds.
Thus, both limits are easily satisfied with a reasonable clock
rate in the range 1-100ms per tick.
Using the timestamp option relaxes the requirements on MSL for
avoiding sequence number wrap-around. For example, with a 1 ms
timestamp clock, the 32-bit timestamp will wrap its sign bit in
25 days. Thus, it will reject old duplicates on the same
connection as long as MSL is 25 days or less. This appears to
be a very safe figure. If the timestamp has 10 ms resolution,
the MSL requirement is boosted to 250 days. An MSL of 25 days
or longer can probably be assumed by the gateway system without
requiring precise MSL enforcement by the TTL value in the IP
layer.
3. DUPLICATES FROM EARLIER INCARNATIONS OF CONNECTION
We turn now to the second potential cause of old duplicate packet
errors: packets from an earlier incarnation of the same connection.
The appendix contains a review the mechanisms currently included in
TCP to handle this problem. These mechanisms depend upon the
enforcement of a maximum segment lifetime (MSL) by the Internet
layer.
The MSL required to prevent failures due to an earlier connection
incarnation does not depend (directly) upon the transfer rate.
However, the timestamp option used as described in Section 2 can
provide additional security against old duplicates from earlier
connections. Furthermore, we will see that with the universal use of
the timestamp option, enforcement of a maximum segment lifetime would
no longer be required for reliable TCP operation.
There are two cases to be considered (see the appendix for more
explanation): (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.
3.1 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 "When to Keep Quiet" in the TCP
protocol specification [Postel81]. The MSL that is required here
does not depend upon the transfer speed. The current TCP MSL of 2
minutes seems acceptable as an operational compromise, as many
host systems take this long to boot after a crash.
However, the timestamp 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 will be
unnecessary.
To dispense totally with the quiet time would seem to 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. Fortunately, we can back off from this
strict requirement. Suppose that the clock is always re-
synchronized 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.
3.2 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
[Postel81]. 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. This 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.*
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 no worse at high transfer
speeds.
(b) Allow old duplicate segements to expire.
Suppose that a host keeps a cache of the last timestamp
received from each remote host. This can be used to reject
old duplicate segments from earlier incarnations of the
_________________________
*Note: 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.
connection, if the timestamp clock can be guaranteed to have
ticked at least once since the old conennection was open.
This requires that the TIME-WAIT delay plus the RTT together
must be at least one tick of the sender's timestamp clock.
Note that this is a variant on the mechanism proposed by
Garlick, Rom, and Postel (see the appendix), 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.
We conclude that if all hosts used the TCP timestamp algorithm
described in Section 2, enforcement of a maximum segment lifetime
would be unnecessary and the quiet time at system startup could be
shortened or removed. In any case, the timestamp mechanism can
provide additional security against old duplicates from earlier
connection incarnations. However, a 4 minute TIME-WAIT delay
(unrelated to MSL enforcement or network speed) must be retained
to provide the reliable close handshake of TCP.
4. CONCLUSIONS
We have presented a mechanism, based upon the TCP timestamp echo
option of RFC-1072, that will allow very high TCP transfer rates
without reliability problems due to old duplicate segments on the
same connection. This mechanism also provides additional security
against intrusion of old duplicates from earlier incarnations of the
same connection. If the timestamp mechanism were used by all hosts,
the quiet time at system startup could be eliminated and enforcement
of a maximum segment lifetime (MSL) would no longer be necessary.
REFERENCES
[Cerf76] Cerf, V., "TCP Resynchronization", Tech Note #79, Digital
Systems Lab, Stanford, January 1976.
[Dalal74] Dalal, Y., "More on Selecting Sequence Numbers", INWG
Protocol Note #4, October 1974.
[Garlick77] Garlick, L., R. Rom, and J. Postel, "Issues in Reliable
Host-to-Host Protocols", Proc. Second Berkeley Workshop on
Distributed Data Management and Computer Networks, May 1977.
[Hamming77] Hamming, R., "Digital Filters", ISBN 0-13-212571-4,
Prentice Hall, Englewood Cliffs, N.J., 1977.
[Jacobson88] Jacobson, V., and R. Braden, "TCP Extensions for
Long-Delay Paths", RFC1072, LBL and USC/Information Sciences
Institute, October 1988.
[Jacobson90] Jacobson, V., "4BSD Header Prediction", ACM Computer
Communication Review, April 1990.
[McKenzie89] McKenzie, A., "A Problem with the TCP Big Window
Option", RFC1110, BBN STC, August 1989.
[Postel81] Postel, J., "Transmission Control Protocol", RFC793,
DARPA, September 1981.
[Tomlinson74] Tomlinson, R., "Selecting Sequence Numbers", INWG
Protocol Note #2, September 1974.
[Watson81] Watson, R., "Timer-based Mechanisms in Reliable
Transport Protocol Connection Management", Computer Networks,
Vol. 5, 1981.
APPENDIX -- Protection against Old Duplicates in TCP
During the development of TCP, a great deal of effort was devoted to
the problem of protecting a TCP connection from segments left from
earlier incarnations of the same connection. Several different
mechanisms were proposed for this purpose [Tomlinson74] [Dalal74]
[Cerf76] [Garlick77].
The connection parameters that are required in this discussion are:
Tc = Connection duration in seconds.
Nc = Total number of bytes sent on connection.
B = Effective bandwidth of connection = Nc/Tc.
Tomlinson proposed a scheme with two parts: a clock-driven selection
of ISN (Initial Sequence Number) for a connection, and a
resynchronization procedure [Tomlinson74]. The clock-driven scheme
chooses:
ISN = (integer(R*t)) mod 2**32 [2]
where t is the current time relative to an arbitrary origin, and R is
a constant. R was intended to be chosen so that ISN will advance
faster than sequence numbers will be used up on the connection.
However, at high speeds this will not be true; the consequences of
this will be discussed below.
The clock-driven choice of ISN in formula [2] guarantees freedom from
old duplicates matching a reopened connection if the original
connection was "short-lived" and "slow". By "short-lived", we mean a
connection that stayed open for a time Tc less than the time to cycle
the ISN, i.e., Tc < 2**32/R seconds. By "slow", we mean that the
effective transfer rate B is less than R.
This is illustrated in Figure 1, where sequence numbers are plotted
against time. The asterisks show the ISN lines from formula [2],
while the circles represent the trajectories of several short-lived
incarnations of the same connection, each terminating at the "x".
Note: allowing rapid reuse of connections was believed to be an
important goal during the early TCP development. This
requirement was driven by the hope that TCP would serve as a
basis for user-level transaction protocols as well as
connection-oriented protocols. The paradigm discussed was the
"Christmas Tree" or "Kamikazee" segment that contained SYN and
FIN bits as well as data. Enthusiasm for this was somewhat
dampened when it was observed that the 3-way SYN handshake and
the FIN handshake mean that 5 packets are required for a minimum
exchange. Furthermore, the TIME-WAIT state delay implies that
the same connection really cannot be reopened immediately. No
further work has been done in this area, although existing
applications (especially SMTP) often generate very short TCP
sessions. The reuse problem is generally avoided by using a
different port pair for each connection.
- 2**32 ISN ISN
* *
* *
* *
*x *
o *
^ * *
* x *
* o *
S *o *
e o *
q * *
* *
# * x *
*o *
o_______________*____________
^ Time -->
4.55hrs
Figure 1. Clock-Driven ISN avoiding duplication on
short-Lived, slow connections.
However, clock-driven ISN selection does not protect against old
duplicate packets for a long-lived or fast connection: the
connection may close (or crash) just as the ISN has cycled around and
reached the same value again. If the connection is then reopened, a
datagram still in transit from the old connection may fall into the
current window. This is illustrated by Figure 2 for a slow, long-
lived connection, and by Figures 3 and 4 for fast connections. In
each case, the point "x" marks the place at which the original
connection closes or crashes. The arrow in Figure 2 illustrates an
old duplicate segment. Figure 3 shows a connection whose total byte
count Nc < 2**32, while Figure 4 concerns Nc >= 2**32.
To prevent the duplication illustrated in Figure 2, Tomlinson
proposed to "resynchronize" the connection sequence numbers if they
came within an MSL of the ISN. Resynchronization might take the form
of a delay (point "y") or the choice of a new sequence number (point
"z").
- 2**32 ISN ISN
* *
* *
* *
* *
* *
^ * *
* *
* *
S * *
e * x* y
q * o *
* o *z
# *o *
* *
*_________________*____________
^ Time -->
4.55hrs
Figure 2. Resynchronization to Avoid Duplication
on Slow, Long-Lived Connection
- 2**32 ISN ISN
* *
x o * *
* *
o-->o* *
* *
^ o o *
* *
o * *
S * *
e o * *
q * *
o* *
# * *
o *
*_________________*____________
^ Time -->
4.55hrs
Figure 3. Duplication on Fast Connection: Nc < 2**32 bytes
- 2**32 ISN ISN
o * *
x * *
* *
o * *
o *
^ * *
o * *
* o *
S * *
e o * *
q * o *
* *
# o *
* o *
*_________________*____________
^ Time -->
4.55hrs
Figure 4. Duplication on Fast Connection: Nc > 2**32 bytes
In summary, Figures 1-4 illustrated four possible failure modes for
old duplicate packets from an earlier incarnation. We will call
these four modes F1 , F2, F3, and F4:
F1: B < R, Tc < 4.55 hrs. (Figure 1)
F2: B < R, Tc >= 4.55 hrs. (Figure 2)
F3: B >= R, Nc < 2**32 (Figure 3)
F4: B >= R, Nc >= 2**32 (Figure 4)
Another limitation of clock-driven ISN selection should be mentioned.
Tomlinson assumed that the current time t in formula [2] is obtained
from a clock that is persistent over a system crash. For his scheme
to work correctly, the clock must be restarted with an accuracy of
1/R seconds (e.g, 4 microseconds in the case of TCP). While this may
be possible for some hosts and some crashes, in most cases there will
be an uncertainty in the clock after a crash that ranges from a
second to several minutes.
As a result of this random clock offset after system
reinitialization, there is a possibility that old segments sent
before the crash may fall into the window of a new connection
incarnation. The solution to this problem that was adopted in the
final TCP spec is a "quiet time" of MSL seconds when the system is
initialized [Postel81, p. 28]. No TCP connection can be opened until
the expiration of this quiet time.
A different approach was suggested by Garlick, Rom, and Postel
[Garlick77]. Rather than using clock-driven ISN selection, they
proposed to maintain connection records containing the last ISN used
on every connection. To immediately open a new incarnation of a
connection, the ISN is taken to be greater than the last sequence
number of the previous incarnation, so that the new incarnation will
have unique sequence numbers. To handle a system crash, they
proposed a quiet time, i.e., a delay at system startup time to allow
old duplicates to expire. Note that the connection records need be
kept only for MSL seconds; after that, no collision is possible, and
a new connection can start with sequence number zero.
The scheme finally adopted for TCP combines features of both these
proposals. TCP uses three mechanisms:
(A) ISN selection is clock-driven to handle short-lived connections.
The parameter R = 250KBps, so that the ISN value cycles in
2**32/R = 4.55 hours.
(B) (One end of) a closed connection is left in a "busy" state,
known as "TIME-WAIT" state, for a time of 2*MSL. TIME-WAIT
state handles the proper close of a long-lived connection
without resynchronization. It also allows reliable completion
of the full-duplex close handshake.
(C) There is a quiet time of one MSL at system startup. This
handles a crash of a long-lived connection and avoids time
resynchronization problems in (A).
Notice that (B) and (C) together are logically sufficient to prevent
accidental reuse of sequence numbers from a different incarnation,
for any of the failure modes F1-F4. (A) is not logically necessary
since the close delay (B) makes it impossible to reopen the same TCP
connection immediately. However, the use of (A) does give additional
assurance in a common case, perhaps compensating for a host that has
set its TIME-WAIT state delay too short.
Some TCP implementations have permitted a connection in the TIME-WAIT
state to be reopened immediately by the other side, thus short-
circuiting mechanism (B). Specifically, a new SYN for the same
socket pair is accepted when the earlier incarnation is still in
TIME-WAIT state. Old duplicates in one direction can be avoided by
choosing the ISN to be the next unused sequence number from the
preceding connection (i.e., FIN+1); this is essentially an
application of the scheme of Garlick, Rom, and Postel, using the
connection block in TIME-WAIT state as the connection record.
However, the connection is still vulnerable to old duplicates in the
other direction. Mechanism (A) prevents trouble in mode F1, but
failures can arise in F2, F3, or F4; of these, F2, on short, fast
connections, is the most dangerous.
Finally, we note TCP will operate reliably without any MSL-based
mechanisms in the following restricted domain:
* Total data sent is less then 2**32 octets, and
* Effective sustained rate less than 250KBps, and
* Connection duration less than 4.55 hours.
At the present time, the great majority of current TCP usage falls
into this restricted domain. The third component, connection
duration, is the most commonly violated.
Security Considerations
Security issues are not discussed in this memo.
Authors' Addresses
Van Jacobson
University of California
Lawrence Berkeley Laboratory
Mail Stop 46A
Berkeley, CA 94720
Phone: (415) 486-6411
EMail: van@CSAM.LBL.GOV
Bob Braden
University of Southern California
Information Sciences Institute
4676 Admiralty Way
Marina del Rey, CA 90292
Phone: (213) 822-1511
EMail:
Braden@ISI.EDU
Lixia Zhang
XEROX Palo Alto Research Center
3333 Coyote Hill Road
Palo Alto, CA 94304
Phone: (415) 494-4415
