gavish&hantler-ieee-1983-an algorithm for optimal route selection in sna networks.pdf
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1154 IEEE TRANSACTIONS ON COMMUNICATIONS, VOL. COM-31, NO. 10 ,CTOBER983
[ 141 J .
K.DeRosa,
L.
H. Ozarow,
and L.
W . Weiner,
Efficient packet
satellite communications, f E E E
Trans . Comrnun.
vol. COM-27,
pp.1416-1422,Oct.1979.
[ 151
T .
Suda,H.Miyahara,
and
T. Hasegawa, Optimal
bandwidth
assignment on up- and downlinksf satellite
with
buffer capacity,
IEEE Trans. Com rn u n .
vol. COM-28, pp.
1808-1818,
Oct. 1980.
[
161
J .
F. Chang,
Packet
satellite
system
with
multiuplinks
and
priority
discipline,
IEEE Trans. Com jnun .
vol.COM-30,
Part 11,
pp.
1143-1 152, May 1982.
[
171
J .
F.
Chang nd
L.
Y.
Lu,
Highcapacity
low
delay
packet
switching via
a
processingsatellite,
in
Cot
R e c . , f n t . Con
Commun. , Philadelphia, PA, June 1982, pp. 1E.3.1-IE.3.5.
[
181 R.
V.
Churchill,
Complex
VariablesandApplications,
2nd
ed.
New
York:
McGraw-Hill, 1960.
An Algorithm for Optimal Route Selection
Networks
BEZALEL GAVISH
AND
SIDNEY L. HANTLER
in SNA
Absrract-The problem of selecting a single route for each class of
service and each pair of communicating nodes in an SNA network is
considered.Thenodes, inks,sets ofcandidateroutes,and raffic
characteristics are given. The goal is to select a set of routes which
minimizes the expected network enld-to-end queueing and transmis-
sion delay. Queueing is modeled as network
of M / M / I
queues which
leads to
a
nonlinear combinatorial optimization problem.
UsingLagrangeanrelaxationandsubgradientoptimization ech-
niques, we obtain a tight lower bound on the minimal expected delay
as well as sets
of
feasible solutions for the problem. An experimental
interactive ystemhas beenused Ito evaluate heprocedure; very
favorable results have been obtained on a variety of networks.
C
I. INTROD.UCTION
OMPUTER communicationnetworksare a vitalpart of
manyndustrial,overnmental,inancial,nd service
institutions.Theysupportan ncreasingvarietyof services.
Backbonenetworks odaycancontainfrom a few nodes o
hundreds of nodeswithmanyhosts upporting housands
of users.Most of thecommercially available networksand
network architectures such as DATAPAC [51
, [
28
1 ,
SNA
[2 2] , [2 5] , NPDN [3 4] , TRAIVSPAC [81, TELENET [351,
andTYMNET [3 0] , [3 6] have adopted a staticorsemidy-
namic routing method
in
which routes are defined at system
gene ration or at ession initiation for each pair f communicat-
Paper approved by the Editor
foI
Computer Communication
of
the
IEEE Communications Society for publication without oral presenta-
tion. Manuscript received October19, 1982.
B.
Gavish is with the Graduate School
of
Management, University
of
Rochester, Rochester,
N Y
14627.
S. L.
Hantler is with the
IBM
T.
J.
Watson Research Center, York-
town Heights,
N Y
10598.
ing nodes. The selection of these routes is o f p rime importan
in determining the response times experienced y users and has
a majorignificanceneasonable tilization f etwork
resources (nodebuffersand inkcapacities)whileproviding
reasonable service
to
users.
We consider theproblem
of
optimal oute election n
computerommunicationetworksnwhichhe
nodes
(hostsndommunicationontrollers),inks,inkrans-
mission speeds,ndxternalrafficnputharacteristics
are given. Messages origina te and erminate at nodes (source
and destination, respectively) and are transmitted from source
todestination hrough ntermediatenodes nd inks long
fixed outes,determinedat he ime of networkdefinition.
(Theroutesarestatic.) Messages in the netwo rk are charac-
terizedby class of ervice (e.g., inte rac tive ,batch, ecure),
and the set of messages of a pa rticular class of service at e ach
source/destination pair comprise a c ommodity. Givena sub-
set of all possible routes n he network, we select for each
commo dity one route over which all messages fo r tha t com-
modity will be routed. (The routing is nonbifurcated for each
commodity.)
The problem we are studying is tha t of selecting the opti-
mal set of routes for multicommodity
flow
in a network with
static, nonbifurcated routing. (Our motivation for concentrat-
ing on this case i s that most operational networks use a static
nonbifurcated routing.)
Messages entering the ne twork encoun ter delay due to the
finite transmission speed of the links and the resultant queue-
ing at intermediate nodes. The delay encountered by messages
depends
on
the hoiceof outes, ndourobjective is
to
selecthoseouteswhichminimizehe averageelay
of
messages in the network.
Following Kleinrock [2 6] , th e links are modeled as single
server queues with exponen tial service time distribution. The
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1983 IEEE
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GAVISH AND HANTLER: OPTIMAL ROUTE SELECTION
network is a set of such queues at which messages arrive with
aPoissonarrival rate and whose engths are chosen from an
exponentialdistributionwhich is identical for all ueues.
Nodes re ssumed to have infinite uffers ndinks re
assumed to have negligible propagation delay. The network de-
lay in such a model is a nonlinear function of link utilization
and he outing is assumed t o benonbifurcated.This eads
to an optimization problem whose formulation is a nonlinear
zero-one programming problem.
Previousresearch on routing n computer communication
networksbyFrankandChou [ lo ] , CantorandGerla [ 4 ] ,
and Bertsekas [3 ] has concentrated on th eprQblem of optimal
route selection n networks with bifurcated routing. This re-
sults in the formulation
of
a continuous programming problem
with a nonlinear objective function over a convex polyhedral
set.Theproblemhasbeensolvedusing echniquessuchas
thegradientprojection lgorithm, lowdeviation, nd he
extrema1 flows method. Gallager
[
121 proposed a distributed
algorithm
for
optimal outing
of
messages inanetwork n
which the traffic input character istics are slowly varying over
time ndnwhich messages of a single commoditymay
traverse different routes at any time. (This s quasi-static bifur-
cated routing.)
There is no published research which attempts to solve the
nonbifurcated oute election roblem ptimally.Courtois
and Semal
[6]
apply a modified version of the Cantor-Gerla
flow eviation lgorithm as a euristicn etworkswith
nonbifurcatedtaticouting.Theyestedheir rocedure
on avariety of networksand were able to generategood
solutions
for
lightly loaded networks.
In SNA networks,up oeightroutesareselectedatnet-
work definition time for each commodity. For each commod-
ity, hese outes reordered ndbecome he outesover
which llraffic orhat ommodity will travel. When a
conversation (session)of a oarticular class
of
service
is
initiated
by
a
user, the first active route in that list (Le., route whose
nodes and inks are working and available) s selected as the
route for all messages
of
tha t session. In this paper, we restrict
our attention to the problem
of
selecting the first rout e for
each commodity from a set of given candidates.Thisset of
candidatesmay nclude all legal SNA outesbetween he
source and destination or may be a suitably chosen subset.
The problem we address is combinator ial in nature, as can
beseen romasimpleexample.Suppose hereareat east
r routes n hecandidateset oreachcommodityand hat
there are
c
commodities in our example network. Then there
are
r c
possiblechoices for selecting the first route for each
commodity. In a typical small SNA network, we can expect
r
to
be about five and c
to
be about
200.
The problem con-
fronting the route planner in such a network is t o select the
optimal 200 routesrom monghe pproximately lo4'
choices
of 200
routes.
InSections I1 and 111 therouteselectionproblem
is
for-
mulated as a nonlinear zero-one integer programming problem.
In Section
IV ,
we ntroducea Lagrangean relaxationofour
problem.The elaxation
is
obtainedbydualizing ubset
of
theconstraints,and nSection
V
weshowhow t o use a
subgradient optimization procedure to move from one relaxa-
tion
to
another naneffort o mprove he esultant ower
bound for theprobl em. We show, inSection VI, how o
solve the elaxations, nSection VI1 weshowhowwe have
implemented his echnique n a system for network design,
and in Section VI11 we present some results of computational
tests. inally,weonclude y discussing openroblems
and suggesting further research.
11. PROBLEM FORMULATION
In order omodel heend-toenddelay n henetwork
we use assumptions that are commonly used in modeling the
queueing phenomena in computer networks. We assume that
links have a finite capacity for transmissions, that nodes have
unlimitedbuffers to to re messages waiting for ree inks,
and hat he arrival processof messages to he netw ork has
aPoissondistribution.To implify he exposition we also
assume that links have a negligible propagationdelay, hat
nodes have no message process ing delay , and hat here isa
single class of service for each pairof nodes.
The queueing and transmission delay of messages are mod-
eled as a network of
MIMI1
queues, in which links are treated
as servers whose service rate is proportional to link capacity,
messages are reated as customers whose waiting area is net-
worknodes. Using the ndependenceassumption Kleinrock
[ 2 7 ] ) , the ueueing ndransmission elay on link
is
l/(pQl
f l , where Q l is thecapacity of link 1 inbitsper
second, { l is th e arrival rate of messages to link 1 and /p
is the expected message length. This formula is used as a basis
for estimating the expected end-to-end delay in the network,
which is the weighted sum
of
the expected delays of the links
in the routes.
We introduce the following notation for the route selection
problem.
n Thendexet of theommunicatingource/
destination pairs (commodities) in the network.
Typically, this is a subset
of
the nodepairs.
L Thendexet
of
linksnhe etwork.
R Thendexet of candidateoutes.heet of
candidateoutesanerovidedysers,
generated by a route generation algorithm or a
combination
of
theseechniques.
A
route
is
characterized by he ordered set
of
links (from
source to destination) in the route.
used in router and is zero otherwise.
The
index set
of
candidate routes
or
commodity
p .
We assume th at if
p
hen
S,
n
S
=
qj.
6, l
An indicatorunctionwhich is one if link
1
is
S
z
The apacityofink inbitsper econd.
f r (or
{
The message arrival rate of the unique commod-
1 P Themean of thexponentialistributionrom
ity p associated with route
,
where
r
E S,.
which the lengthsof the messages are drawn.
selected for message routing and zero otherwise .
Xr Aecisionariablehich is one if route r is
Using theabovenotationweconclude hat he otalbit
arrival rateon ink
1
equals . ~ f r h r l x r / p . rom his,we
observe that the expected network delays
where
T =
ZpEnf, is th e otal arrival rat e of messages in
the network.
The route selection problem (problem IP) is t o find binary
variables x which satisfy
ZI P
= min
subject to
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I156 IEEERANSACTIONSNOMMUNICATIONS, VOL. COM-31, NO.
10,
OCTOBER 1983
, = I
r E S p
x r = 0 or
1 V r E R.
The first constraint ensures hat he flow on each link does
notexceed tscapac ity, while theselection of exactly one
route per commodity is ensuredby he second and hird
constraints. Problem IP is a nonlinear combinatorial optimiza-
tion problem with constraint set identical to that of the multi-
ple choicemulticonstrained napsack roblem Sinha and
Zoltners [ 3 3 ] , Gavish andPirkul
[
18 ]) , which
is
known
to
be NP-complete.Theouteelection roblem has the
additional complication of having a nonlinear objective func-
tion, thus leading to a more difficult problem.
Research t o date on nonlinear combinatorial optimization
problems is quite limited to special cases such as the quadratic
assignmentproblemor to verysmallproblem sizes.Present
networkscontainup o 200 nodeswith housands of com-
munica ting node pairs tha t select routes from sets containing
from a few thousand to hundreds of thousands of candidate
routes, eading to very arge problem sizes. Future networks
will require the solution f significantly larger problems.
Several methods have beenconsidered as candidate s oi
solving problem IP. Takingadvantage of the act hat he
objective function in (1) is separable over links, y e can relax
the integralityconstraints, replacing themwith
0
< x r < 1
for all
r E R .
This eads to a very argenonlinear optimiza-
tion problem of a separable objective function over a convex
set. Based on the state of the art in the computational ability
to solve the relaxed problems, the idea was rejected. The idea
of using piecewise linearization of the objective function and
solving the inearprogrammingproblem was lso rejected.
The main reason was the fact hat he relaxed problems are
very large and solving them would have required a significant
computational ffort nd would ave generatedractional
solutions, orcing
us
to use abranch-and-bound Garfinkel
andNemhauser [ 131 ) procedurewhichwould have made
matters even worse.
111.PROBLEM EFORMULATION
In thissection we transform herouteselectionproblem
formulation ntoanequivalent ormulationwhich is better
suited ora Lagrangean relaxa tionprocedure.Letting
f i
be
the utilization of link I (i.e., heproportionof he links
capac ity consumed by the actual message flow), the objective
function can be rewritten as
where
and
o r
=
r
V r E R a n d I E L .
P Q I
Since the objective function n
(2) is
strictly increasing with
f i we can replace the equal ity in
3 )
with an inequality leading
to
subject to
V l L
r = l
r E S p
x r = 0
or
1
V r E R
where p is the index set of routes that support comniodity
p ,
and nd L I are upper ndowerbounds, espectively,
on the utilization of link 1. When the prob lem has a feasible
solution, UI is less thanone.Tosimplify heexposition we
will assume that LI
= 0
and
i =
1. Once a feasible solution
to heproblem has been dentified, hosebounds can be
significantlyightened by using informa tion enerated by
the feasible solution.
IV.
LAGRANGEAN ELAXATION
By multiply ing the constra ints, in
3 )
by a vector of rion-
positiveLagrangemultipliers, X I
I E
L,andadding hem
to the objective fu nction, we obtain the Lagrangean relaxation
of problem IP:
L(h)
=
min
subject to
O < f r < l
and
x r = 1
r E S p
and
x,
=
0
or
1
V l E L
V r E R .
The set of feasible solutions for problem IP is a subset of the
setof feasible solutions orhe Lagrangean relaxat ion of
problem IP. The nonpositivity of
h
ensures that in any feasi-
ble solutionor roblemP,he xpression
Z, lELXdf i
2 r E ~ . x r ~ y ~ }s nonposit ive and thus, the value of the objec tive
function in 4 ) is never greater than t he value of the objective
function in .problem IP. Thus, whenever problem IP hasa
feasible solution,
L(h)d
Z I P .For each vector of multipliers
A,
L(h) is a lower bound for
Z I P .
The best possible bound for
such a procedure s given by the vector of multipliers
A *
which
satisfy L(h*) = maxAG oL(h) . Thus, to have tight bounds we
need a procedure for computingh*.
V. THE
SUBGRADIENTPTIMIZATIONROCEDURE
Several methods have been suggested n the iterature for
computing a vector of optima l Lagrange multipliers for com-
binatorialptimizationroblems. Thesencludeolumn
generation procedures
[ 2 3 ] ,
dual ascent and multiplier adjust-
mentprocedures [91 , andsubgradientoptimizationproce-
dures
[ 2 4 ] .
Subgradientoptimizationprocedures have been
shown o be ery ffectiven ariety of combinatorial
optimization problems such as the traveling salesman problem
[ 2 3 ] ,
the multiple traveling saleman problem
[
191
,
opologi-
cal design of computer communication systems [ 15 ,
[
161 ,
and ot sizing in BOMP based systems
[
1
.
This
was
the
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GAVISH AND HANTLER: OPTIMAL ROUTE SELECTION
1157
motivation or hedecision o oncentrateon ubgradient
optimization techniques.
Let xr(h),
f l X )
be an optimal solution to the Lagrangean
problem for a fixed vector h. A subgradient is the vector with
coordinates
70) = O xr(h)arl 'J L. 1
rER
Poljack [29
1
has shown that when the multipliers are updated
using the iterative formula
X;+ = hk
+ tkYf
( 5 )
then x converges to h* provided that tk converges to 0 and
ztk
diverges. Held and Karp
[ 2 3 ]
and ater Held et al .
[24
have suggested substituting
-
Z I P m k
0 y k 112
tk
=
6p
They have shown that if 0
< 6,
< 2-and
ZIP
L(h*) this itera-
tive computation of t k has been used in most successful appli-
cations of subgradient optimization procedures.
The teps involved n the ubgradientoptimizationpro-
cedure are as follows.
1) Initialization:
-
a ) Using aheuristic,computeanoverestimate
ZIP
of
L X * )
or set
ZIP
o an arbitrarily large value.
b) Select an initial set of multipliers ho and set
k ,
the
iterationcounter, o
0,
the mprovementcounter to
0, X*
to
ho,
the current best value of
L(h)
to
0,
and 6 , a parameter
for adjusting he stepsize, to 60 (an arbitrary positive nitial
value, e.g., 2) .
2) Solving the Lagrangean problem:
a
Increment he mprovementand terationcounters
5
Go to .2.
Extensivecomputationalexperiencewith hisprocedure
has shown that it s very stable and converges in a few hundred
iterations oa olutionwhich is very lose to L(h*). The
procedure has een found o bensensitive to he nit ial
multipliervalues nd to he nitialoverestimate.However,
:,.&he rate of convergence and uali ty of bound enerated
'hepends to a large extent on the limits set on the improvement
and iteration counters. Low settings terminate the procedure
before
it
reaches a good solution, while high settings consume
excessive computing resources. Good settings of these param-
etersrequirecareful balancing between hese woconsidera-
tions, which seems to be obtained most readily by experimen-
tation.
VI.
SOLVING
HE LAGRANGEAN PROBLEM
The computational efficiency of the subgradient optimiza-
tion procedure depends on our ability to solve efficiently the
Lagrangean problemwhich is generated nstep2)b) of the
subgradient optimization procedure. Fortunately, for a fixed
setofmultipliers, he Lagrangean problem is separable into
subproblems which a re readily olved.
The Lagrangean problem can be rewri tten as
L(h)
=
min
z
I+
X f I I
Z r {
EL
-
1
with no change in the set of constraints.
Since there reno oupling onstraintsbetween he f r
and the
x,
variables, L(X) can be written as
L h )
= L l ( A ) +
L , ( X ) where
by 1. Subproblem
b) Solve the Lagrangean problem using
X k
as the Lagrange
t
multipliers. Thus, obtain
L ( h k )
and xk fk.
3 )
Testing and updating parameters:
a ) If
L ( h k )
isgreater han hecurrentbes t value of
L h ) then eplace hecurrentbest value of L(h) by
L ( h k )
and et
h*
to
hk.
Also reset he mprovement ounter o ubject
to
-1.
of
its associated objective func tion for that prob lem. this
value s less than hecurre nt value of
Zip,
thenset ZIP toand
this Subproblem 2
C ) f the mprovement counter has reached a prespeci-
fied upper limit, then set 6 to 6/2,X k to h*, the improvement
counter to 0, and go to 2)a).
d) If theterationounter has exceededespecified
b) If
x k
is feasible forroblemP,omputehe value 0
r l
1 'J I E L
limit ;
f
6 is less than a prespecified limi t, or if t i is less
thana prespecified limit ,or if ( Z I p - L X*))/L h*)s less
than a prespecified error to lerance , then stop.
4)
Updating the multipliers: Compute a new subgradient
Compu te the new stepsize
Z I P
L O k )
Compu te the new multipliers
h f + ' = m i n ( - l , h f + t k y f ) J Z E L .
Set k to k + 1.
subject to
r = l Y P E n
rESp
x I = o o r
1
J r E R .
Subproblem 1 can e eparated int o J L subproblems,
one for each link, where the subproblem associated with.the
kt h link is
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I158
IEEERANSACTIONS ON COMMUNICATIONS, VOL. COM-31, NO. 10, OCTOBER 1983
subject to
O < f k < l .
The solution to this subproblem s
This gives us the value of Llk and, hence,of
L l X ) .
Subproblem
2
canbe separated nto
In
subproblems,
one oreachcommodity,where he ubproblem oreach
commodity
p
is
~5 =
min
2
xrar
,ESP
subject to
x , = 1
, E S P
x r = O o r 1 v r r E S p
where a, = X I E ~
-Alarl .
index 0 which satisfies
Thesolution o hissubproblem is toset xp = 1 oran
ap = min a,.
r E S
VII.
PROCEDURE
MPLEMENTATION
To est heapplicability of thesubgradientoptimization
procedure to network design problems and to obtain estimates
on the rat e of convergence, he quality of bounds, and solu-
tionsgenerated, we have implemented heprocedure nan
APL-based system.
The
system
has
a user-friendly nterface
and nables the user to conveniently efinehe etwork
characteristics, raffic patterns, and optimization goals to be
achieved.Thesystemprovides acilities to analyze he gen-
erated olutionsand allows th e user to revise thedataor
optimization goals and redesign thenetwork.The process
is initiatedbyentering henodesandhosts n henetwork
anddefining thecommunicatingnodepairs. Links and heir
capacities redefined next.The user is thenprompted to
specify t he oute generation equirementswhich re used
in a route generation procedure for generating a set of candi-
date routeswhich could be additions to the users predefined
set. Next, he user is prompted o specifysession character-
istics which are used to compute the matrix
{a,l}.
The system
uses a full screen display and is menu driven by the user who
has flexible options and escape procedures. It allows the user
toefine,ptimize,ndefinearge,omplexetworks
easily and quickly.
After specifying the problem parameters, the user initiates
an optimizationprogramwhich he ightlycontrols. This s
done by means of a menuof parameters that the user provides
and can be changed easily depending on the optimizati on re-
sults.
Two ypes of iterations,major ndminor, redefined
in he ystem.Amajor teration onsists of manyminor
iterations, each of which is an evaluation of the current value
of
the objective unction,achoice of subgradientdirection
andmodification of the value of X Theminor terations
terminatewhenone of thestoppingconditions is satisfied.
For example, he difference between a feasible solution and
the Lagrangean is small, the subgradient is small, or an upper
limit on the number of iterations has been reached.
Throughout he optimization process, he system updates
the best Lagrangeanvalue, themultipliers,generated neach
major iteration, and the besteasible solution yet generated.
Based on the output generate d after
a
major iteration, the
user mayerminate,eenterheubgradient ptimization
procedure with new parameters, or modify he optimization
problemby changing inkspeeds, traffic, sessions, or routes
andhenesumehe ptimization. Thisterativerocess
continues until a satisfactory solution has been reached.
Thesuhgradientoptimizationprocedurerequires anover-
estimate Z1p on L(X*) used toupd ate he Lagrange multi-
pliers. This overestimate can be a feasible solution generated
byaheuristic
or
a large numbergreater han L(X*). The
following heuristic is used to generate good feasible solutions.
In eachminorteration of theubgradient ptimization
procedure, Subproblem
2
is solved. We select, fo r each com-
modity, he owestmodifiedcost oute as thebest et of
rout es for the Lagrangean problem. If this routing is feasible
forproblem
IP
and esults in ashorterdelay han hebest
previous easible solution, t replaces theprevious olution
andbecomes he bestnew easible solu tion . In mall and
medium size problemshis rocedure as erformed wel
and has quickly led to near-optimal solutions. This, however,
has not been the case in large problems. Here most selections
have been nfeasible.Carefulexamination of theprocedure
has evealed tha t in arge problems hereweremany cases
in
whichdifferent outes had an dentical educedcost. In
those cases, possible ties exist for selecting the primary route
in the Lagrangean subproblem. herocedure haseen
modified
so
that tgeneratesup to K differentcandidate
solutions neach teration.Each olution is determinedby
selecting a single route per commodity. The routes are selec
with denticalprobability rom heset of routes hat have
identical educedcost or hatcommodity.Routesare as-
sumed to be identical if the difference between their reduced
costs n he Lagrangean procedure is sufficiently small. The
solutions are evaluated and the best feasible solution generated
is picked as the new bestfeasiblesolution. In the extensive
computationalxperimen ts we have conducted,we have
found
this procedure to
be effective and
efficient
in quickly
generating very good feasible solutions.
One of the prob lems with Lagrangean optimization proce-
dures s that hey cangenerateabound even if there
is
no
feasib le solution for he original problem. When this occurs,
the user is notifi ed ha t no feasible solution has been gener-
ated.He is thenexpected omodify he design toaccom-
modate the required traffic. In early states of system develop-
men t, he userhad noguidance n making themodification
andwasted onsiderableimewithruitless ttempts.To
assist theuser, he ystemnow ecords good nfeasible
designs. If, in the ull designcycle, no feasible solution is
discovered, the ystem provides the user withdata bout
these infeasible designs which enables him to identify problem
areas in the designs. Such information includes solutions with
the minimal number of saturated links and solutions in which
themaximallysaturated linkhas minimalutilization. Using
these data , the user can modify link capacity or routesso that
a feasible solutionexistsand hen eenter heoptimization
phase.
VIII. COMPUTATIONAL ESULTS
Thenetwork design systemdescribed nSection VI1
has
beenused to est a variety of simulatedand real-world net-
work design problems. It has performed weli without excep-
tion on all the problems tested. In this section we present the
results of a few computa tional experime nts w ith the system.
Figs. 1 -4, which are labeled ARPA, OCT, RING, and USA,
define the topologies of four networks, in which every node
communicateswith every othernode. The irst hreeare
networks tested in
[6]
.) Each ordered pair of nodes consists
of a host node communicating with a terminal node.
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IEEE TRANSACTIONS ON COMMUNICATIONS, VOL. COM-31, NO. 10 OCTOBER 1983
TABLE I
SUMMARY
OF
COMPUTATIONAL RESULTS ONTHE NETWORKS
IN
FIGS. 1-4
Generate
AKPA
ARPA
A R P A
A R P A
A R P A
A R P A
A R P A
A R P A
A R P A
O C T
O C T
O C T
O C T
O C T
O C T
O C T
O C T
O C T
RING
RING
RING
RING
RING
RING
RING
RING
RING
USA
USA
15
15
I5
2
2
2
1
1
2
2
2
2
4
4
8
16
1
I
1
2
2
2
3
4
4
Y
8
2809
2809
2809
420
420
420
210
210
210
325
598
598
598
598
1195
1195
2294
2886
496
496
496
992
992
992
1481
1984
1984
2762
2762
I
I
Mean
Message
Length
0
60
65
50
60
65
50
60
65
I80
200
210
21
220
200
220
220
220
100
I80
183
183
190
200
200
200
210
32
35
T
I
B C
Lower
7.420
11.946
15.790
7.432
11.985
15.913
8.040
16.070
206.980
102.200
81.276
108.035
128.250
155.890
80.912
154.970
150.780
152.070
13.929
77.256
330.750
44.443
49.874
59.563
55.556
53.322
62.831
6.418
7.288
Percent
7.575
0.189
.446
2.306
6.162
0.715 12.032
0.733
0.000
6.070
0.000
.040
0.254
5.954
0.167
2.005
206.980 0.000
102.200
0.000
81.456 0.220
108.459 0.390
128.765 0.398
159.010 1.958
81.720 0.996
158.280 2.090
153.370
0.847 153.370
1.690
13.929
0.000
77.256 0.000
330.750
0.000
45.100
1.456
51.232 2.650
61.608 3.319
56.817 2.220
54.805 2.705
64.006
I .
836
6.502 1.290
7.712 5.496
whichourmethodscan be extended onetworkswith dif-
ferent models
of
delay, e.g.,
M M m
ueues.
The ideas that were presented in
this
paper can be applied
to rela ted network design pToblems. Work is
now
in progress
[
171 on developing modelsnd ptimizationechniques
for hesimultaneous outingandcapacityassignmentprob-
lems n omputer ommunicationnetworks.Thesemodels
incorporate inks, raffic,anddelaycostdata oselect ink
capacities and route the traffic,
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w o r k s , vol.
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pp. 99-122, 1971.
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C o m p u t . M a c h . , vol. 30, no.
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B. Gavish and
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IEEE TRANSACTIONSN COMMUNICATIONS, VOL. COM-31, NO.
10,
OCTOBER 983 1 1 6 1
Combined Random/Reservation Access for Packet
Switched Transmission Over a Satellite with
On-Board Processing:
Part
I-Global Beam
Satellite
Absrmcr-A combinedandom/reservationultiple access
(CRRM A) scheme fo r packet-switched communication over a global
beam satell ite with on-boa rd processing is proposed and analyzed.
Channel ime s divided nto contiguous slots; each slot contains N
minislots or ransmission of requestpacketsand N minislots for
data. With N substantially smaller than the number of earth stations,
collisions will occur in requestpacket ransmissions. Two channel
access algorithms for the CRRMA model a re proposed: uncontrolled
channel acces s (UCA) and controlled channel access (CCA). UCA is
simpler but has an inherent stability problem particularly when the
number of minislots N is small. TheCCAalgorithm estricts he
transmission of request packets for new arrivals to take place only
when the slot is in the FREE state. With N =
3,
the CCA algorithm
exhibits good delay-throughput characteristics. As N increases, the
UCA algorithm offers stable operation. For N 5 the simpler UCA
algorithm is prefe rred over CCA.
Paper approved by the Editor for Computer Communication
of
the
IEEE Communications Society for publication without oral presenta-
tion. M anuscript received July 20, 1982; revised December 10, 1982 .
This workwas supported by the Natural SciencesandEngineering
Research Council of Canada under a Postgraduate Scholarship and
Grant AIII9 .
H. W. Lee is with the Department o f Electrical Engineering and the
Computer Communication Networks Group, UniversityofWaterloo,
Waterloo, Ont., Canada N2L 3G1.
J,
W. Mark is with Department
of
Electrical Engineeringand the
Computer Communication Networks Group, University
of
Waterloo,
Waterloo, Ont. , Canada N2L 3G1.
The performance of the CRRMA scheme is compared to those of
slotted ALOHA, reservation ALOHA, and split reservation multiple
access (SRMA). In all cases the proposed CRRMA scheme exhibits
good delay-throughput performance over a wide range of channel
utilization.
A
I . INTRODUCTION
l a rgenumbe ro fpa pe r so nmul t ip l e c c e ss e c hn ique s
ra ng ing f rom pu re r a ndom a c c e ss o o t a l l y c oo rd ina t e d
dynamic assignment access have appeared in the l i te rature . As
t h e y a r e t o o n u m e r o u s t ois t them a l l , only those whichareper t i -
ne n t to t he p re se n t pa pe r a re l i s t e d in t he Re fe re nc e s .
A primary concern in packe t swi tched da ta communica t ion
ove r a b roa dc a s t c ha nne l i s t he p rob le mf organiz ing the access
o f ma ny u se r s w h ic h sha re t he c ommon c ha nne l . Tw o impor t a n t
performance me a su re s nse lec t ingasui tablemul t ip leaccess
s c h e m e a r e 1 ) m a x i m u m a t t a in a b l e c h a n n e l u t i l iz a t i o n a n d 2
me a npacketde lay .The seperformanceme a su re sde pe ndon
t h e s y s t e m p a r a m e t e r s s u c h a s t h e s i z e o f t h e u s e r p o p u l a t i o n ,
thebu rs t i ne sso fda t a r a f f i c , a nd he p ropa ga t ionde la y . n
th is paper we consider a very la rge user popula t ion wi th bursty
t ra ff ica ndac ha nne lw i tha ongp ropa ga t iondela y, e .g., a
satelli te channel.
The a ssum pt ion o f a a rge popu la tion
of
bursty users ex-
c lude s a ny c ons ide ra t ion of f i xe d a ss ignme n t sc he me s suc h a s
frequency d iv ision mul t ip le access (FDMA ) and synchronous
t imedivisionmul t ip l e c c e ss STD MA )w hic hpermanent ly
assign a por t ion of the channel capac i ty to an indiv id ua l user ,
0090-6778/83/10004161
01
OO 1983 IEEE