Internet DRAFT - draft-ietf-rtgwg-microloop-analysis
draft-ietf-rtgwg-microloop-analysis
Network Working Group Alex Zinin
Internet Draft Alcatel
Expiration Date: June 2006 October 2005
File name: draft-ietf-rtgwg-microloop-analysis-01.txt
Analysis and Minimization of Microloops in
Link-state Routing Protocols
draft-ietf-rtgwg-microloop-analysis-01.txt
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Abstract
Link-state routing protocols (e.g. OSPF or IS-IS) are known to
converge to a loop-free state within a finite period of time after a
change in the topology. It is normal, however, to observe short-term
loops during the period of topology update propagation, route
recalculation, and forwarding table update, due to the asynchronous
nature of link-state protocol operation. This document provides an
analysis of formation of such microloops and suggests simple
mechanisms to minimize them.
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1 Introduction
Link-state routing protocols, such as [OSPF] and [ISIS] converge to a
loop-free state within a finite period of time after a topology
change. Additional changes postpone the convergence, but do not get
in its way.
During the period of convergence, however, link-state protocols
exhibit short-term routing table inconsistencies caused by the
protocol's asynchronous nature. These incornsistencies may cause
short-term packet loops, also known as microloops. For example, see a
sample network in Figure 1.
+--+ 1 +--+
|A |---------|B |
+--+ +--+
| \ 10 |
5| ------ |1
| \ |
+--+ 10 \+--+
|E |---------|C |
+--+ +--+
\_ /
5 \ /1 (failure)
+--+
|D |
+--+
Figure 1. Microloop example
We are interested in routers A and B and their best paths towards D.
Before failure, B's best path to D is B-C-D with cost 2, and A's best
path is A-B-C-D with cost 3. When link C-D fails, both C and D
announce their link state information with link C-D missing. Within a
finite period of time, both A and B shall receive the topology
updates and converge on them, installing new best paths: A-E-D (10)
for A, and B-A-E-D (11) for B. However, if, due to the timing
differences, B calculates and installs its new best path through A
before A has a chance to switch from B to E, a microloop will form
between A and B for the duration of time required for A to complete
its routing table update.
Similar microloops may form when other topological changes happen in
the network, for example, when a new link or a node is added, a link
cost is changed, etc. In summary, whenever a topological change in
the network results in changes of the shortest path three (SPT) for
more than one node, it is possible for the network to exhibit
temporary loops.
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This document provides an analysis of microloop formation.
Specifically, we categorize different types of reconvergence
scenarios, and explore their properties. We then show that in certain
scenarios microloops do not form, in others they can be eliminated
using simple techniques described in this document, and define
scenarios where more sophisticated loop avoidance mechanisms may be
necessary.
It is useful to understand the relationship between [IPFRR] and the
technique described here. The two mechanisms play complimentary roles
to each other: deploying [IPFRR] without micro-loop prevention only
partially addresses the goal of minimizing packet loss during network
reconvergence, since packets will be lost due to microloops. On the
other hand, micro-loop prevention described in this document relies
on [IPFRR] local failure protection, as routers will keep forwarding
traffic down the old path until the new next-hops are known to be
safe.
2 Analysis
To analyse the behavior of a network during reconvergence, we look at
a given router and its neighbors before failure and during the
transition to the new routes. More specifically, we analyse whether
switching to the new routing information can result in loop formation
or not.
2.1 Terminology
The following terms are used in the draft.
Dopt(X,Y)
Integer function defined as the cumulative cost of the least-
cost path from node X to node Y in a topology graph. Normally
calculated by link-state routing protocols using Dijkstra
algorithm as part of regular route calculation procedures.
This is the same as "Distance_opt(A,B)" defined in [IPFRR-FW]
Downstream neighbor
Neighbor N of router S is considered S's downstream neighbor
for destination D, if Dopt(N, D) < Dopt(S, D)
Primary neighbor
Neighbor N of router S is considered S's primary neighbor for
destination D, if the path via N is such that D(S, D) is mini-
mized, i.e. N provides a shortest path to D according to the
SPF calculation.
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Loop-free neighbor
Neighbor N of router S is considered S's loop-free neighbor
for destination D, if Dopt(N, D) < Dopt(N, S) + Dopt(S, D).
Note that a loop-free neighbor may be, for example, router's
primary before and/or after failure.
2.2 Next hop safety condition
We start the analysis of single-hop loops with the following observa-
tion:
After a topology change, there are precisely two situations when a
microloop between routers X and Y can form:
a) Before failure, X uses Y as its next-hop. After failure, Y
uses X as its next-hop. Y updates its routes based on the new
topology before X.
b) Exact opposite of the previous case. Before failure, Y uses X
as its next-hop. After failure, X uses Y as its next-hop. X
updates its routes based on the new topology before Y.
Formulating this for a given calculating router S (either X or Y in
the above example) switching to a new primary Pn, a microloop may
occur between S and Pn only if Pn was forwarding through S before
failure.
Based on the above, we can define a general safety condition for any
neighbor N (whether new primary or not) of router S that has just
learned about a topology change. Note that the condition must satisfy
the topological criteria above, and be non-recursive, i.e. not lead
to loops if both S and N follow it.
Next-hop safety condition:
After a topology change, it is safe for router S to switch to
neigbor N as its next-hop for a specific destination if the
path through N satisfies both of the following criteria:
1. S considered N as its loop-free neighbor based on the
topology before change AND
2. S considers N as its downstream neighbor based on the
topology after change.
The first requirement ensures that N has not been forwarding
traffic to S before the change occured and both S and N used
old topology. The second requirement makes sure N does not
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forward traffic to S when N learns the new topology. Note
again, that N is S's any neighbor, and may or may not be used
by S as its new primary or a temporary safe neighbor.
The difference in the conditions before and after failure is
there to make sure that S and N do not recursively consider
each other as safe next-hops when they learn about the fail-
ure.
2.3 Transition types
Here, we analyse different types of scenarios that a given router may
find itself in after learning about a topology change.
For each destination affected by a topological change, the network
will have three major types of nodes categorized by the degree of
safety of their old primary, new primary, and other neighbors. (Note
that we do not yet consider ECMP, which will be discussed in section
3.2.)
Type A
Routers whose new primary next-hops after the topology change
are safe and transition to them will not create a microloop.
Two subtypes are recognized:
A1: Routers whose primaries haven't changed as a result of
the topology change
A2: Routers whose new primary satisfies the safety condition
Type B
Routers whose new primary next-hops after the topology change
do not satisfy the safety condition, but that have at least
one other neighbor that does. Note that such a neighbor can be
the router's old primary (type B1) or a neighbor that is nei-
ther old nor new primary (type B2).
Type C
Routers that have no neighbor that satisfies the safety condi-
tion.
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It is clear that nothing special needs to be done for type-A routers
as they either do not need to modify their routes or can immediately
switch to the new primary next hops.
It can also be shown that if type-B routers do not immediately switch
to their new primaries, but use their safe next-hops for some time,
switching to the new primaries later will not create loops, provided
that their downstream routers have also switched to the safe hops or
have already switched to the new primaries.
NOTE: The above analysis applies to single-hop loops. Multi-hop
loops, possible in networks with asymmetric link costs could be
prevented by using a tighter safety condition. However, as shown
by simulations on real-life network topologies, doing so would
decrease micro-loop coverage and thus result in increased number of
unprevented single-hop loops.
The following section formally defines the mechanism.
3. Loop prevention mechanism
3.1 Basic procedures
The essense of the mechanism defined here, also known as "path lock-
ing via safe neighbors" (PLSN), can be informally summarized as fol-
lows. Upon a topology change, for each destination:
- Each router in the network assesses safety of its new primary
next-hops.
- If the new primaries are safe, they are used immediately, oth-
erwise, partial
ordering of updates is introduced:
o If non-primary safe neighbors are found, they are used
for a period of time, thus locking traffic to a safe path
while the new primaries complete their transition to the
new routes
o If no safe neighbors are found, the forwarding path is
locked on the old next-hop for some time to give the new
primary enough time to complete route updates.
For a description of several architectural constants used in this
document (named as "DELAY_xxx"), refer to section 3.4.
On receiving a topology update, the router delays its SPF calculation
by DELAY_SPF time in order to collect the remaining updates that
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relate to the same topological event (e.g. update from the router
connected to the second end of a point-to-point link in case of a
link failure, or updates from other neighbors of a failed node).
Upon expiration of DELAY_SPF, the router calculates the new SPT, the
new routes, checks the safety status of each neighbor relative to
each affected destination using the conditions in section 3.1, and
applies the following logic for each route depending on the type of
role it finds itself in:
Type A:
The route SHALL be updated with the new primary next-hops
without an additional delay.
Type B:
The route SHALL be updated with one or more temporary next-
hops that satisfy the safety condition without an additional
delay. These temporary next-hops SHALL be used for the dura-
tion of DELAY_TYPEB. After DELAY_TYPEB, the route SHALL be
updated with the new primary next-hops.
Type C:
The route's old (primary) next-hops SHALL continue to be used
for DELAY_TYPEC. After DELAY_TYPEC, the route SHALL be
updated with the new primary next-hops.
If, after expiration of DELAY_SPF, the router receives a topology
update sooner than DELAY_STABLE after the previous one, the router
MUST fall back to the regular convergence mechanisms by prematurely
expiring DELAY_TYPEB or DELAY_TYPEC timers if they are still running
(thus causing immediate installation of the new primary next-hops),
MUST recalculate its routing table as soon as practical, and MUST
refrain from using the mechanisms described here until it has seen no
topological updates for at least DELAY_STABLE. This is a safeguard
mechanism to ensure that procedures described here are applied only
when a single failure is experienced and that the network converges
in a situation where multiple topological events or network instabil-
ities are experienced.
[ISIS] includes the concept of an Overload bit (OL) that indicates a
node in the network that shouldn't be used as transit. A similar
notion is introduced in OSPF by [STUB] using LSInfinity link costs.
Honoring these conventions, implementations of this document MUST NOT
use neighbors with the OL bit set in IS-IS or announcing links to the
calculating router with LSInfinity cost in OSPF as temporary safe
neighbors.
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NOTE: In OSPF, if S's neighbor N is a stub router, the S->N link,
visited first by the SPF algorithm, will normally have a real link
cost, and it is the backwards link N->S announced by N that will
have its cost set to LSInfinity. Implementations have to account
for this details when satisfying the above requirement.
3.2 Equal Cost Multipath Considerations
In situations where more than one primary next-hop is available after
the topology change, there are several possible combination of their
safety properties:
1) All new next-hops satisfy the safery condition (a pure type-A
situation)
2) Some of the new next-hops satisfy the safety condition, some
of them do not (a combination of type-A and type-B)
3) None of the new next-hops satisfy the safety condition, how-
ever, there's at least one other neighbor that satisfies it (a
safe non-primary next-hop, causing new primaries to be type-B)
4) None of the new next-hops satisfy the safety condition, and
there is no other neighbor that satisfies it (a pure type-C
situation).
For situations 1, 3, and 4 above, the implementation merely follows
the basic procedures described in section 3.1
For situation 2 (an A/B combination), the implementation:
1) SHALL update the route with the new next-hops that satisfy the
safety condition without an additional delay
2) SHALL add the remaining new next-hops after DELAY_TYPEB.
Note that one could potentially use temporary safe neighbors in situ-
ation 2 above, however this specification does not recommend this to
avoid unnessesary traffic rerouting and hence packet reordering.
3.3 Local Failure and IP Fast Reroute Considerations
After detecting a local failure and initiating the local repair
process if IPFRR is supported, the router directly attached to the
point of failure follows the procedures described in this docu-
ment--it delays its SPF calculation to collect updates from other
routers, calculates new routes, and classifies the next-hops.
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For routers implementing IPFRR, the difference with routers that
learn about the failure from the routing protocol updates, is that
one or more of the repairing router's old next-hops has become
unavailable, and hence cannot be considered as the temporary safe
next-hops for type-B operation. Also, if the router was able to
locally repair the failure, and the new primary next-hops do not sat-
isfy the safety condition, the router should consider itself in the
middle of type-B operation with the temporary safe neighbor engaged
as part of IP Fast Reroute operation.
Another distinct situation is when the router does not support IPFRR
or could not repair the failure, the new primary next-hops do not
satisfy the safety condition, and there's no other neighbor that
does, i.e. a type-C situation. Unlike other routers in the network,
the router directly connected to the network does not have the old
next-hop any more, and cannot continue using it. Immediately switch-
ing to the new next-hops, on the other hand, may result in a micro-
loop. In this situation, the router MUST discard traffic forwarded
along the affected route for the duration of DELAY_TYPEC, and then
update the routes. Implementations MAY have a configuration option to
allow switching immediately to the new next-hops for situations where
this type of a micro-loop is not a concern. If implemented, this
option MUST be disabled by default.
As a result, there are the following possible scenarios:
1) If the new primary next-hops satisfy the safery condition, the
router updates the routes without an additional delay.
2) Otherwise, if the failure could be repaired locally by IP Fast
Reroute, the router continues to use the repair path for
DELAY_TYPEB and updates the routes with the new primary next-
hops after it expires.
3) Otherwise (new next-hops are not safe, and IPFRR is not sup-
ported or the failure couldn't be repaired), the router dis-
cards traffic for DELAY_TYPEC and updates the routes with the
new primary next-hops after its expiration.
3.4 Architectural Constants
The following architectural constants have been used in the descrip-
tion of the algorithm above:
DELAY_SPF
The delay between the moment the router receives the first
topology update after a period of stability and the moment it
starts its routing table recalculation. This delay is
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necessary to collect multiple updates originated by different
routers that relate to the same topological event.
DELAY_STABLE
Period of time, during which the network topology is consid-
ered to be stable if the router receives no topological
updates. When the first update after DELAY_STABLE is received,
all other updates that fit within DELAY_SPF are considered as
related to a single topological event.
DELAY_TYPEB and DELAY_TYPEC
Periods of time used by the router to delay installation of
new primary next-hops after a topology change when the router
has (type-B) or has not (type-C) a safe neighbor to temporary
divert the traffic to in the meantime.
While correctness and effectiveness of the algorithm described here
does not depend on the actual values assigned to the architectural
constants, it does depend on the relationship between them, and the
assumption that all routers in the same network use the same values.
To satisfy these constrains, and yet allow these delays to be
decreased as implementations continue to improve towards faster con-
vergence, this document defines the architectural constants as con-
figurable, specifies the required relationship between the values,
and the default values that should be used by the implementations.
The following equations define the relationship between the constants
that needs to be maintained in order for the mechanism described here
to provide desireable results:
DELAY_SPF > update-propagation-time
DELAY_STABLE > DELAY_TYPEB > DELAY_TYPEC > fault-propagation-time
where:
o update-propagation-time is the time it is expected to take
routers in the network to detect the failure, and originate
and propagate new link-state information.
o fault-propagation-time is update-propagation plus the time it
is expected to take routers in the network to calculate the
new SPT, check the safety condition of the neighbors, and
install required FIB entries.
Because fault-propagation-time includes update-propagation-time, and
DELAY_SPF (since every router will delay its SPF according to this
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document):
fault-propagation-time > DELAY_SPF + update-propagation-time
and hence the equations above can be converted to one:
DELAY_STABLE > DELAY_TYPEB > DELAY_TYPEC > (DELAY_SPF + update-prop-
agation-time)
The implementations SHOULD use the following default values for the
architectural constants:
Constant Default val
----------------------------------------
DELAY_SPF 500 msec
DELAY_TYPEC 2 sec
DELAY_TYPEB 4 sec
DELAY_STABLE 10 sec
4 Coverage analysis
The above algorithm minimizes the probability of loop formation. More
specifically, loops will only be possible when two neighboring
routers both experience the type C condition after the topology
change. Appendix A shows that transitions between A-A, A-B, A-C, and
B-C routers are loop-free.
While this mechanism does not remove all possible micro-loops, it
addresses the majority of them in topologies with a reasonable level
of physical redundancy. Topologically, micro-loop coverage provided
by this algorithm is very similar to that provided by [IPFRR]. This
is due to the fact that similar construct are used by both mecha-
nisms.
5 Backwards Compatibility Analysis
Effectiveness of the mechanism described here relies on the assump-
tion that all routers in the network support it.
In a situation where some routers do not support the describer mecha-
nism, the network will continue to converge properly fundamentals of
the routing system are not changed. When a topology change event
occurs in such a network, Type-A and Type-B routers will not substan-
tially change the convergence patterns, as they will switch to
routers that are guaranteed to forward traffic correctly after
DELAY_SPF. (Note that routers today already implement a delay
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similar to DELAY_SPF.) Type-C routers, when mixed with routers not
supporting this mechanism, may induce longer than usual micro-loops
(up to DELAY_TYPEC), however this delay is in the same order of mag-
nitude as in most deployed networks today.
6 Security Considerations
The mechanism described in this document does not modify any routing
protocol messages, and hence no new threats related to packet modifi-
cations or replay attacks are introduced. The mechanism changes cer-
tain delays used in node-local algorithms and introduces partial
event ordering after a topology change has occured. This, however,
does not introduce new security risks. For type-B situations, traffic
to certain destinations can be temporarily routed via next-hop
routers that would not be used with the same topology change if this
mechanism wasn't employed. However, these next-hop routers can be
used anyway when a different topological change occurs, and hence
this can't be viewed as a new security threat.
7 Acknowledgements
The author would like to thank Don Fedyk, Chris Martin, Alex Audu,
Olivier Bonaventure, Stefano Previdi, and other members of the IETF
RTGWG for their useful comments. Special thanks go to Alia Atlas,
Mike Shand, and Steward Bryant, who were instrumental in development
of this mechanism, such as fine-tuning the safety condition, simulat-
ing the mechanism, proof-reading the document, and without whom this
work wouldn't be possible.
8 References
8.1 Normative References
[OSPF] J. Moy. OSPF version 2. Technical Report RFC 2328, Internet
Engineering Task Force, 1998.
[ISIS] ISO, "Intermediate system to Intermediate system routeing
information exchange protocol for use in conjunction with the
Protocol for providing the Connectionless-mode Network Service
(ISO 8473)," ISO/IEC 10589:1992.
[IPFRR] Atlas, A., "Basic Specification for IP Fast-Reroute:
Loop-free Alternates", Internet Engineering Task Force, Work
in Progress, draft-ietf-rtgwg-ipfrr-spec-base-03.txt
8.2 Informative References
[IPFRR-FW] Shand, M., S. Bryant, "IP Fast Reroute Framework",
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Internet Engineering Task Force, Work in Progress, draft-ietf-
rtgwg-ipfrr-framework-04.txt
[STUB] Retana, A., et al, OSPF Stub Router Advertisement, RFC 3137,
Internet Engineering Task Force, 2001.
Author's Address
Alex Zinin
Alcatel
701 E Middlefield Rd
Mountain View, CA 94043
E-mail: zinin@psg.com
Appendix A. Loop formation analysis
S is the calculating router discovering the failure through a link-state
update. P is the old primary, NP is the new primary.
BF:
<------
[P]----------------[S]----------------[NP]
...>?
AF:
------>
[P]----------------[S]----------------[NP]
?<...
To analyze possible loop formation, we need to check the following:
1) if it is possible for P to start forwarding packets to S
before S switches to NP
2) if it is possible for NP to be forwarding packets back to S
before or after S starts using it
Assumptions are that type-As switch-over to NP immediately, and type-
Bs and type-Cs wait certain amount of time so that:
DELAY_TYPEB > DELAY_TYPEC > fault-propagation-time
1. S is type A:
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BF analysis:
1.1 If P is another type-A, then S cannot be its new primary, since
S has not been P's LFA before (since it's been fwd'ing through P).
Hence, P will not route through S AF, and the will be no loops
between P and S.
1.2 If P is a type-B, then S hasn't been P's LF neighbor BF, and P
will not forward through S at least for DELAY_TYPEB, which gives S
enough time to switch to NP. After DELAY_TYPEB P may start using S
as it's new primary.
1.3 If P is a type-C, then it hasn't been forwarding traffic to S
BF, and will not use S as its new primary at least for DELAY_TYPEC,
which should give S enough time to switch to NP.
1.4 Consequently, no loops will form between a type-A node and it's
old primary before the type-A nodes switches to its new primary.
AF analysis:
1.5 Regardless of its type, NP has not been forwarding packets to S
BF and will not do so AF by definition of type-A.
1.6 Consequently, no loops will form between a type-A node and it's
new primary before or after the type-A nodes switches to it.
2. S is type B:
BF analysis:
2.1 If P is a type-A, then similarly to 1.1 above, there will be no
routes between P and S.
2.2 If P is another type-B, then similarly to 1.2, S will not be
used by P for at least DELAY_TYPEB, and S will have enough time to
switch to its safe hops or NP.
2.3 If P is a type-C, then similarly to 1.3, S hasn't been receiv-
ing traffic from P BF, and will not AF for at least DELAY_TYPEC,
which should give S enough time to switch to its safe hops or NP.
2.4 Consequently, no loops will form between a type-B node and it's
old primary before the type-B nodes switches to its new primary.
AF analysis:
2.5 If NP is a type-A, then because of the DELAY_TYPEB NP must have
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had enough time to switch to its new NP, which cannot be S by defi-
nition of SPT considering that NP is S's new nexthop in the SPT AF.
2.6 If NP is another type-B, then because of DELAY_TYPEB, NP must
have had enough time to switch from its old primary and can equally
likely be routing through either its safe hops, or its new primary.
Neither of the two can be S by definition of a downstream node (for
safe hops) and SPT (for new primary).
2.7 If NP is a type-C, then because DELAY_TYPEB > DELAY_TYPEC, NP
must have had enough time to switch to its new primary, which can't
be S by definition of SPT and considering that NP is S's nexthop in
the SPT AF.
2.8 Consequently, no loops will form between a type-B node and it's
new primary before or after the type-A nodes switches to it.
3. S is type C:
BF analysis:
3.1 If P is a type-A, then similarly to 1.1 before, S has not been
P's LF neighbor before and hence won't be its new primary, so no
loops will form between P and S.
3.2 If P is a type-B, then similarly to 1.2, S will not be used by
P for at least DELAY_TYPEB, and because DELAY_TYPEB > DELAY_TYPEC,
S will have enough time to switch to NP.
3.3 If P is another type-C, then it hasn't been using S as its pri-
mary BF, but it is possible for P to consider S as its new primary
AF and to install routes before S after their DELAY_TYPEC expires.
Hence, a microloop is possible between P and S.
3.4 Consequently, a microloop between a type-C node and its old
primary is possible only if the old primary is also a type-C node
and it considers S as its new primary AF. Note that DELAY_TYPEC
only delays probably loop formation, but does not increase its
duration, as both neighboring routers are using the same delay.
AF analysis:
3.5 If NP is a type-A, then because of the DELAY_TYPEC NP must have
had enough time to switch to its new NP, which cannot be S by defi-
nition of SPT considering that NP is S's new nexthop in the SPT AF.
3.6 If NP is a type-B, then because of DELAY_TYPEC, NP must have
had enough time to switch to its safe hops, which can't be S by
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definition of a downstream node and considering that NP is S's new
SPT next-hop.
3.7 If NP is another type-C, a loop is possible if S's DELAY_TYPEC
expires before that on NP and NP has been using S as its primary
BF.
3.8 Consequently, a microloop between a type-C node and its new
primary is possible only if the new primary is also a type-C node
and S was NP's primary BF.
4. Given the above analysis, it can be noted that, for a given fail-
ure, presence of single type-C nodes in the network does not create
microloops.
It is the C-C combination that introduces this potential.
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This document and the information contained herein are provided on an
Zinin [Page 16]
INTERNET DRAFT IGP Microloop Analysis & Minimization October 2005
"AS IS" basis and THE CONTRIBUTOR, THE ORGANIZATION HE/SHE REPRESENTS
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