RFC 2992  Analysis of an EqualCost MultiPath Algorithm
(Formats: TXT)
Network Working Group C. Hopps
Request for Comments: 2992 NextHop Technologies
Category: Informational November 2000
Analysis of an EqualCost MultiPath Algorithm
Status of this Memo
This memo provides information for the Internet community. It does
not specify an Internet standard of any kind. Distribution of this
memo is unlimited.
Copyright Notice
Copyright (C) The Internet Society (2000). All Rights Reserved.
Abstract
Equalcost multipath (ECMP) is a routing technique for routing
packets along multiple paths of equal cost. The forwarding engine
identifies paths by nexthop. When forwarding a packet the router
must decide which nexthop (path) to use. This document gives an
analysis of one method for making that decision. The analysis
includes the performance of the algorithm and the disruption caused
by changes to the set of nexthops.
1. HashThreshold
One method for determining which nexthop to use when routing with
ECMP can be called hashthreshold. The router first selects a key by
performing a hash (e.g., CRC16) over the packet header fields that
identify a flow. The N nexthops have been assigned unique regions
in the key space. The router uses the key to determine which region
and thus which nexthop to use.
As an example of hashthreshold, upon receiving a packet the router
performs a CRC16 on the packet's header fields that define the flow
(e.g., the source and destination fields of the packet), this is the
key. Say for this destination there are 4 nexthops to choose from.
Each nexthop is assigned a region in 16 bit space (the key space).
For equal usage the router may have chosen to divide it up evenly so
each region is 65536/4 or 16k large. The nexthop is chosen by
determining which region contains the key (i.e., the CRC result).
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2. Analysis
There are a few concerns when choosing an algorithm for deciding
which nexthop to use. One is performance, the computational
requirements to run the algorithm. Another is disruption (i.e., the
changing of which path a flow uses). Balancing is a third concern;
however, since the algorithm's balancing characteristics are directly
related to the chosen hash function this analysis does not treat this
concern in depth.
For this analysis we will assume regions of equal size. If the
output of the hash function is uniformly distributed the distribution
of flows amongst paths will also be uniform, and so the algorithm
will properly implement ECMP. One can implement nonequalcost
multipath routing by using regions of unequal size; however, non
equalcost multipath routing is outside the scope of this document.
2.1. Performance
The performance of the hashthreshold algorithm can be broken down
into three parts: selection of regions for the nexthops, obtaining
the key and comparing the key to the regions to decide which nexthop
to use.
The algorithm doesn't specify the hash function used to obtain the
key. Its performance in this area will be exactly the performance of
the hash function. It is presumed that if this calculation proves to
be a concern it can be done in hardware parallel to other operations
that need to complete before deciding which nexthop to use.
Since regions are restricted to be of equal size the calculation of
region boundaries is trivial. Each boundary is exactly regionsize
away from the previous boundary starting from 0 for the first region.
As we will show, for equal sized regions, we don't need to store the
boundary values.
To choose the nexthop we must determine which region contains the
key. Because the regions are of equal size determining which region
contains the key is a simple division operation.
regionsize = keyspace.size / #{nexthops}
region = key / regionsize;
Thus the time required to find the nexthop is dependent on the way
the nexthops are organized in memory. The obvious use of an array
indexed by region yields O(1).
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2.2. Disruption
Protocols such as TCP perform better if the path they flow along does
not change while the stream is connected. Disruption is the
measurement of how many flows have their paths changed due to some
change in the router. We measure disruption as the fraction of total
flows whose path changes in response to some change in the router.
This can become important if one or more of the paths is flapping.
For a description of disruption and how it affects protocols such as
TCP see [1].
Some algorithms such as roundrobin (i.e., upon receiving a packet
the least recently used nexthop is chosen) are disruptive regardless
of any change in the router. Clearly this is not the case with
hashthreshold. As long as the region boundaries remain unchanged
the same nexthop will be chosen for a given flow.
Because we have required regions to be equal in size the only reason
for a change in region boundaries is the addition or removal of a
nexthop. In this case the regions must all grow or shrink to fill
the key space. The analysis begins with some examples of this.
0123456701234567012345670123456701234567
++++++
 1  2  3  4  5 
+++++++++
 1  2  4  5 
+++++
0123456789012345678901234567890123456789
Figure 1. Before and after deletion of region 3
In figure 1. region 3 has been deleted. The remaining regions grow
equally and shift to compensate. In this case 1/4 of region 2 is now
in region 1, 1/2 (2/4) of region 3 is in region 2, 1/2 of region 3 is
in region 4 and 1/4 of region 4 is in region 5. Since each of the
original regions represent 1/5 of the flows, the total disruption is
1/5*(1/4 + 1/2 + 1/2 + 1/4) or 3/10.
Note that the disruption to flows when adding a region is equivalent
to that of removing a region. That is, we are considering the
fraction of total flows that changes regions when moving from N to
N1 regions, and that same fraction of flows will change when moving
from N1 to N regions.
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0123456701234567012345670123456701234567
++++++
 1  2  3  4  5 
+++++++++
 1  2  3  5 
+++++
0123456789012345678901234567890123456789
Figure 2. Before and after deletion of region 4
In figure 2. region 4 has been deleted. Again the remaining regions
grow equally and shift to compensate. 1/4 of region 2 is now in
region 1, 1/2 of region 3 is in region 2, 3/4 of region 4 is in
region 3 and 1/4 of region 4 is in region 5. Since each of the
original regions represent 1/5 of the flows the, total disruption is
7/20.
To generalize, upon removing a region K the remaining N1 regions
grow to fill the 1/N space. This growth is evenly divided between
the N1 regions and so the change in size for each region is 1/N/(N
1) or 1/(N(N1)). This change in size causes nonend regions to
move. The first region grows and so the second region is shifted
towards K by the change in size of the first region. 1/(N(N1)) of
the flows from region 2 are subsumed by the change in region 1's
size. 2/(N(N1)) of the flows in region 3 are subsumed by region 2.
This is because region 2 has shifted by 1/(N(N1)) and grown by
1/(N(N1)). This continues from both ends until you reach the
regions that bordered K. The calculation for the number of flows
subsumed from the Kth region into the bordering regions accounts for
the removal of the Kth region. Thus we have the following equation.
K1 N
 i  (iK)
disruption = \  + \ 
/ (N)(N1) / (N)(N1)
 
i=1 i=K+1
We can factor 1/((N)(N1)) out as it is constant.
/ K1 N \
1    
=   \ i + \ (iK) 
(N)(N1)  / / 
\   /
1 i=K+1
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We now use the the concrete formulas for the sum of integers. The
first summation is (K)(K1)/2. For the second summation notice that
we are summing the integers from 1 to NK, thus it is (NK)(NK+1)/2.
(K1)(K) + (NK)(NK+1)
= 
2(N)(N1)
Considering the summations, one can see that the least disruption is
when K is as close to half way between 1 and N as possible. This can
be proven by finding the minimum of the concrete formula for K
holding N constant. First break apart the quantities and collect.
2K*K  2K  2NK + N*N + N
= 
2(N)(N1)
K*K  K  NK N + 1
=  + 
(N)(N1) 2(N1)
Since we are minimizing for K the right side (N+1)/2(N1) is constant
as is the denominator (N)(N1) so we can drop them. To minimize we
take the derivative.
d
 (K*K  (N+1)K)
dk
= 2K  (N+1)
Which is zero when K is (N+1)/2.
The last thing to consider is that K must be an integer. When N is
odd (N+1)/2 will yield an integer, however when N is even (N+1)/2
yields an integer + 1/2. In the case, because of symmetry, we get
the least disruption when K is N/2 or N/2 + 1.
Now since the formula is quadratic with a global minimum half way
between 1 and N the maximum possible disruption must occur when edge
regions (1 and N) are removed. If K is 1 or N the formula reduces to
1/2.
The minimum possible disruption is obtained by letting K=(N+1)/2. In
this case the formula reduces to 1/4 + 1/(4*N). So the range of
possible disruption is (1/4, 1/2].
To minimize disruption we recommend adding new regions to the center
rather than the ends.
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3. Comparison to other algorithms
Other algorithms exist to decide which nexthop to use. These
algorithms all have different performance and disruptive
characteristics. Of these algorithms we will only consider ones that
are not disruptive by design (i.e., if no change to the set of next
hops occurs the path a flow takes remains the same). This will
exclude roundrobin and random choice. We will look at moduloN and
highest random weight.
ModuloN is a "simpler" form of hashthreshold. Given N nexthops
the packet header fields which describe the flow are run through a
hash function. A final moduloN is applied to the output of the
hash. This result then directly maps to one of the nexthops.
ModuloN is the most disruptive of the algorithms; if a nexthop is
added or removed the disruption is (N1)/N. The performance of
ModuloN is equivalent to hashthreshold.
Highest random weight (HRW) is a comparative method similar in some
ways to hashthreshold with nonfixed sized regions. For each next
hop, the router seeds a pseudorandom number generator with the
packet header fields which describe the flow and the nexthop to
obtain a weight. The nexthop which receives the highest weight is
selected. The advantage with using HRW is that it has minimal
disruption (i.e., disruption due to adding or removing a nexthop is
always 1/N.) The disadvantage with HRW is that the nexthop
selection is more expensive than hashthreshold. A description of
HRW along with comparisons to other methods can be found in [2].
Although not used for nexthop calculation an example usage of HRW
can be found in [3].
Since each of moduloN, hashthreshold and HRW require a hash on the
packet header fields which define a flow, we can factor the
performance of the hash out of the comparison. If the hash can not
be done inexpensively (e.g., in hardware) it too must be considered
when using any of the above methods.
The lookup performance for hashthreshold, like moduloN is an
optimal O(1). HRW's lookup performance is O(N).
Disruptive behavior is the opposite of performance. HRW is best with
1/N. Hashthreshold is between 1/4 and 1/2. Finally ModuloN is
(N1)/N.
If the complexity of HRW's nexthop selection process is acceptable
we think it should be considered as an alternative to hashthreshold.
This could be the case when, for example, perflow state is kept and
thus the nexthop choice is made infrequently.
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However, when HRW's nexthop selection is seen as too expensive the
obvious choice is hashthreshold as it performs as well as moduloN
and is less disruptive.
4. Security Considerations
This document is an analysis of an algorithm used to implement an
ECMP routing decision. This analysis does not directly affect the
security of the Internet Infrastructure.
5. References
[1] Thaler, D. and C. Hopps, "Multipath Issues in Unicast and
Multicast", RFC 2991, November 2000.
[2] Thaler, D. and C.V. Ravishankar, "Using NameBased Mappings to
Increase Hit Rates", IEEE/ACM Transactions on Networking,
February 1998.
[3] Estrin, D., Farinacci, D., Helmy, A., Thaler, D., Deering, S.,
Handley, M., Jacobson, V., Liu, C., Sharma, P. and L. Wei,
"Protocol Independent MulticastSparse Mode (PIMSM): Protocol
Specification", RFC 2362, June 1998.
6. Author's Address
Christian E. Hopps
NextHop Technologies, Inc.
517 W. William Street
Ann Arbor, MI 481034943
U.S.A
Phone: +1 734 936 0291
EMail: chopps@nexthop.com
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RFC 2992 Analysis of ECMP Algorithm November 2000
7. Full Copyright Statement
Copyright (C) The Internet Society (2000). All Rights Reserved.
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Acknowledgement
Funding for the RFC Editor function is currently provided by the
Internet Society.
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