rfc2212.txt

著名的RFC文档,其中有一些文档是已经翻译成中文的的.


RFC 2212             Guaranteed Quality of Service        September 1997


   Reshaping is done by combining a buffer with a token bucket and peak
   rate regulator and buffering data until it can be sent in conformance
   with the token bucket and peak rate parameters.  (The token bucket
   regulator MUST start with its token bucket full of tokens).  Under
   guaranteed service, the amount of buffering required to reshape any
   conforming traffic back to its original token bucket shape is
   b+Csum+(Dsum*r), where Csum and Dsum are the sums of the parameters C
   and D between the last reshaping point and the current reshaping
   point.  Note that the knowledge of the peak rate at the reshapers can
   be used to reduce these buffer requirements (see the section on
   "Guidelines for Implementors" below).  A network element MUST provide
   the necessary buffers to ensure that conforming traffic is not lost
   at the reshaper.

      NOTE: Observe that a router that is not reshaping can still
      identify non-conforming datagrams (and discard them or schedule
      them at lower priority) by observing when queued traffic for the
      flow exceeds b+Csum+(Dsum*r).

   If a datagram arrives to discover the reshaping buffer is full, then
   the datagram is non-conforming.  Observe this means that a reshaper
   is effectively policing too.  As with a policer, the reshaper SHOULD
   relegate non-conforming datagrams to best effort.  [If marking is
   available, the non-conforming datagrams SHOULD be marked]

      NOTE: As with policers, it SHOULD be possible to configure how
      reshapers handle non-conforming datagrams.

   Note that while the large buffer makes it appear that reshapers add
   considerable delay, this is not the case.  Given a valid TSpec that
   accurately describes the traffic, reshaping will cause little extra
   actual delay at the reshaping point (and will not affect the delay
   bound at all).  Furthermore, in the normal case, reshaping will not
   cause the loss of any data.

   However, (typically at merge or branch points), it may happen that
   the TSpec is smaller than the actual traffic.  If this happens,
   reshaping will cause a large queue to develop at the reshaping point,
   which both causes substantial additional delays and forces some
   datagrams to be treated as non-conforming.  This scenario makes an
   unpleasant denial of service attack possible, in which a receiver who
   is successfully receiving a flow's traffic via best effort service is
   pre-empted by a new receiver who requests a reservation for the flow,
   but with an inadequate TSpec and RSpec.  The flow's traffic will now
   be policed and possibly reshaped.  If the policing function was
   chosen to discard datagrams, the best-effort receiver would stop
   receiving traffic.  For this reason, in the normal case, policers are
   simply to treat non-conforming datagrams as best effort (and marking



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RFC 2212             Guaranteed Quality of Service        September 1997


   them if marking is implemented).  While this protects against denial
   of service, it is still true that the bad TSpec may cause queueing
   delays to increase.

      NOTE: To minimize problems of reordering datagrams, reshaping
      points may wish to forward a best-effort datagram from the front
      of the reshaping queue when a new datagram arrives and the
      reshaping buffer is full.

      Readers should also observe that reclassifying datagrams as best
      effort (as opposed to dropping the datagrams) also makes support
      for elastic flows easier.  They can reserve a modest token bucket
      and when their traffic exceeds the token bucket, the excess
      traffic will be sent best effort.

   A related issue is that at all network elements, datagrams bigger
   than the MTU of the network element MUST be considered non-conformant
   and SHOULD be classified as best effort (and will then either be
   fragmented or dropped according to the element's handling of best
   effort traffic).  [Again, if marking is available, these reclassified
   datagrams SHOULD be marked.]

Ordering and Merging

   TSpec's are ordered according to the following rules.

   TSpec A is a substitute ("as good or better than") for TSpec B if (1)
   both the token rate r and bucket depth b for TSpec A are greater than
   or equal to those of TSpec B; (2) the peak rate p is at least as
   large in TSpec A as it is in TSpec B; (3) the minimum policed unit m
   is at least as small for TSpec A as it is for TSpec B; and (4) the
   maximum datagram size M is at least as large for TSpec A as it is for
   TSpec B.

   TSpec A is "less than or equal" to TSpec B if (1) both the token rate
   r and bucket depth b for TSpec A are less than or equal to those of
   TSpec B; (2) the peak rate p in TSpec A is at least as small as the
   peak rate in TSpec B; (3) the minimum policed unit m is at least as
   large for TSpec A as it is for TSpec B; and (4) the maximum datagram
   size M is at least as small for TSpec A as it is for TSpec B.

   A merged TSpec may be calculated over a set of TSpecs by taking (1)
   the largest token bucket rate, (2) the largest bucket size, (3) the
   largest peak rate, (4) the smallest minimum policed unit, and (5) the
   smallest maximum datagram size across all members of the set.  This
   use of the word "merging" is similar to that in the RSVP protocol
   [10]; a merged TSpec is one which is adequate to describe the traffic
   from any one of constituent TSpecs.



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   A summed TSpec may be calculated over a set of TSpecs by computing
   (1) the sum of the token bucket rates, (2) the sum of the bucket
   sizes, (3) the sum of the peak rates, (4) the smallest minimum
   policed unit, and (5) the maximum datagram size parameter.

   A least common TSpec is one that is sufficient to describe the
   traffic of any one in a set of traffic flows.  A least common TSpec
   may be calculated over a set of TSpecs by computing: (1) the largest
   token bucket rate, (2) the largest bucket size, (3) the largest peak
   rate, (4) the smallest minimum policed unit, and (5) the largest
   maximum datagram size across all members of the set.

   The minimum of two TSpecs differs according to whether the TSpecs can
   be ordered.  If one TSpec is less than the other TSpec, the smaller
   TSpec is the minimum.  Otherwise, the minimum TSpec of two TSpecs is
   determined by comparing the respective values in the two TSpecs and
   choosing (1) the smaller token bucket rate, (2) the larger token
   bucket size (3) the smaller peak rate, (4) the smaller minimum
   policed unit, and (5) the smaller maximum datagram size.

   The RSpec's are merged in a similar manner as the TSpecs, i.e. a set
   of RSpecs is merged onto a single RSpec by taking the largest rate R,
   and the smallest slack S.  More precisely, RSpec A is a substitute
   for RSpec B if the value of reserved service rate, R, in RSpec A is
   greater than or equal to the value in RSpec B, and the value of the
   slack, S, in RSpec A is smaller than or equal to that in RSpec B.

   Each network element receives a service request of the form (TSpec,
   RSpec), where the RSpec is of the form (Rin, Sin).  The network
   element processes this request and performs one of two actions:

    a. it accepts the request and returns a new Rspec of the form
       (Rout, Sout);
    b. it rejects the request.

   The processing rules for generating the new RSpec are governed by the
   delay constraint:

          Sout + b/Rout + Ctoti/Rout <= Sin + b/Rin + Ctoti/Rin,

   where Ctoti is the cumulative sum of the error terms, C, for all the
   network elements that are upstream of and including the current
   element, i.  In other words, this element consumes (Sin - Sout) of
   slack and can use it to reduce its reservation level, provided that
   the above inequality is satisfied.  Rin and Rout MUST also satisfy
   the constraint:

                             r <= Rout <= Rin.



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   When several RSpec's, each with rate Rj, j=1,2..., are to be merged
   at a split point, the value of Rout is the maximum over all the rates
   Rj, and the value of Sout is the minimum over all the slack terms Sj.

      NOTE: The various TSpec functions described above are used by
      applications which desire to combine TSpecs.  It is important to
      observe, however, that the properties of the actual reservation
      are determined by combining the TSpec with the RSpec rate (R).

      Because the guaranteed reservation requires both the TSpec and the
      RSpec rate, there exist some difficult problems for shared
      reservations in RSVP, particularly where two or more source
      streams meet.  Upstream of the meeting point, it would be
      desirable to reduce the TSpec and RSpec to use only as much
      bandwidth and buffering as is required by the individual source's
      traffic.  (Indeed, it may be necessary if the sender is
      transmitting over a low bandwidth link).

      However, the RSpec's rate is set to achieve a particular delay
      bound (and is notjust a function of the TSpec), so changing the
      RSpec may cause the reservation to fail to meet the receiver's
      delay requirements.  At the same time, not adjusting the RSpec
      rate means that "shared" RSVP reservations using guaranteed
      service will fail whenever the bandwidth available at a particular
      link is less than the receiver's requested rate R, even if the
      bandwidth is adequate to support the number of senders actually
      using the link.  At this time, this limitation is an open problem
      in using the guaranteed service with RSVP.

Guidelines for Implementors

   This section discusses a number of important implementation issues in
   no particular order.

   It is important to note that individual subnetworks are network
   elements and both routers and subnetworks MUST support the guaranteed
   service model to achieve guaranteed service.  Since subnetworks
   typically are not capable of negotiating service using IP-based
   protocols, as part of providing guaranteed service, routers will have
   to act as proxies for the subnetworks they are attached to.

   In some cases, this proxy service will be easy.  For instance, on
   leased line managed by a WFQ scheduler on the upstream node, the
   proxy need simply ensure that the sum of all the flows' RSpec rates
   does not exceed the bandwidth of the line, and needs to advertise the
   rate-based and non-rate-based delays of the link as the values of C
   and D.




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   In other cases, this proxy service will be complex.  In an ATM
   network, for example, it may require establishing an ATM VC for the
   flow and computing the C and D terms for that VC.  Readers may
   observe that the token bucket and peak rate used by guaranteed
   service map directly to the Sustained Cell Rate, Burst Size, and Peak
   Cell Rate of ATM's Q.2931 QoS parameters for Variable Bit Rate
   traffic.

   The assurance that datagrams will not be lost is obtained by setting
   the router buffer space B to be equal to the token bucket b plus some
   error term (described below).

   Another issue related to subnetworks is that the TSpec's token bucket
   rates measure IP traffic and do not (and cannot) account for link
   level headers.  So the subnetwork network elements MUST adjust the
   rate and possibly the bucket size to account for adding link level
   headers.  Tunnels MUST also account for the additional IP headers
   that they add.

   For datagram networks, a maximum header rate can usually be computed
   by dividing the rate and bucket sizes by the minimum policed unit.
   For networks that do internal fragmentation, such as ATM, the
   computation may be more complex, since one MUST account for both
   per-fragment overhead and any wastage (padding bytes transmitted) due
   to mismatches between datagram sizes and fragment sizes.  For
   instance, a conservative estimate of the additional data rate imposed
   by ATM AAL5 plus ATM segmentation and reassembly is

                         ((r/48)*5)+((r/m)*(8+52))

   which represents the rate divided into 48-byte cells multiplied by
   the 5-byte ATM header, plus the maximum datagram rate (r/m)
   multiplied by the cost of the 8-byte AAL5 header plus the maximum
   space that can be wasted by ATM segmentation of a datagram (which is
   the 52 bytes wasted in a cell that contains one byte).  But this
   estimate is likely to be wildly high, especially if m is small, since
   ATM wastage is usually much less than 52 bytes.  (ATM implementors
   should be warned that the token bucket may also have to be scaled
   when setting the VC parameters for call setup and that this example
   does not account for overhead incurred by encapsulations such as
   those specified in RFC 1483).

   To ensure no loss, network elements will have to allocate some
   buffering for bursts.  If every hop implemented the fluid model
   perfectly, this buffering would simply be b (the token bucket size).
   However, as noted in the discussion of reshaping earlier,
   implementations are approximations and we expect that traffic will
   become more bursty as it goes through the network.  However, as with



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