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## Special Topics

by: Otilia Murray I

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7

# Special Topics MAT 180

Otilia Murray I
UCD
GPA 3.88

Staff

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COURSE
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7
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KARMA
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## Popular in Mathematics (M)

This 7 page Class Notes was uploaded by Otilia Murray I on Tuesday September 8, 2015. The Class Notes belongs to MAT 180 at University of California - Davis taught by Staff in Fall. Since its upload, it has received 33 views. For similar materials see /class/187391/mat-180-university-of-california-davis in Mathematics (M) at University of California - Davis.

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Date Created: 09/08/15
Mathematics for Decision Making An Introduction Lecture 20 Matthias Koppe UC Davis Mathematics March 12 2009 The PrimalDual Algorithm reminder PrimalDual Algorithm Input Graph G VA capacities u excess values b costs c 0 Construct a pair of initial solutions x y a Whilex is not feasible If there exists an xaugmenting path P of equality arcs Determine the width of the path Augment the flow x along P Otherwise Find a vertex set R blocking all such paths and change y for all v E VF1 as described on page 18 12 a We were not happy with this algorithm because it seems we may need quite a number of dual steps change of potentials until we can make the next primal step sending flow from an xsource to an xsin The PrimalDual Algorithm complexity analysis a To be more precise Because each dual step increases the size of the blocking set R by at least one vertex at most n7 1 dual steps are necessary a For integervalued data it is clear that each primal step augmenting flow decreases the imbalance by at least 1 so the number of augmentations is bounded by the initial imbalance on Zmax0 by 7 fxov V where x0 is the initial feasible solution a For nonnegative costs we could start with the zero flow x0 0 so we have at most Bo Zmax0 by V augmentations So again we will get a pseudopolynomial algorithm of running time OSn m n on where 8n m is the running time of a shortestpath computation 0 Knowing this more precisely does not make us happier though PrimalDual Algorithm with LeastCost This observation suggests a new algorithm due to Busacker Gowen 1961 PrimalDual Algorithm with LeastCost Augmenting Paths Input Graph G VA capacities u excess values b costs c 0 Construct a pair of initial solutions x y o Whilex is not feasible Find a leastcost with respect to reduced costs 6 xincrementing path P from an xsource to v for each v E V one nonnegativecost shortestpathtree calculation in a graph with an artificial source denote by 5 the costs of the paths Choose an xsink s such that as is minimum Update the potentials y z y minoos for v e V Augment x on PS This algorithm maintains the optimality conditions on x and y in each step 2 Efficiency of Algorithm Initial Feasible Solution 0 Because the dual update can be done in one step using a single shortestpathtree computation this is quite a bit faster The running time reduces to OSnm non o How do we construct a pair of initial solutions by the way a If all costs are nonnegative can use x 0 y 0 0 We could try to sety O or arbitrary and set XVYW UVW if EVYW lt 0 and XVYW 0 to satisfythe optimality conditions However this fails if some UVW oo a General solution updated a Solve a maximumflow problem to find out whether there is a feasible flow discard the solution 0 Solve a shortest path problem in a directed graph G that only has the arcs with infinite capacities using the original costs c o If there is no feasible shortestpath potential there exists a negativecost directed cycle of infinite capacity so the problem is unbounded no optimal solution 9 Otherwise we obtain a feasible shortestpaths potential y on 6 so we ave yw g yV 0VW for all v w with UVW oo a We use this y as the initial potential From the above inequality we have EVYW 2 0 for all arcs v w with UVW oo 0 Now set XVYW UVW if EVYW lt 0 and XVYW 0 Note that no XVYW will be infinite 2040 o By a scaling technique where demands by are replaced by by2H Edmonds Karp 1972 obtained a polynomialtime variant The running time is 0n 8n m 1 log maxBo U where U is the largest finite arc capacity 0 The scaleandshrink algorithm following from work by Tardos 1985 Orlin 1985 Fujishige 1986 is a strongly polynomialtime variant with a running time of 0mo nnlog n 8n m 2041 Th e s much more of optimization to learn We have only scratched the surface a MAT168 Spring 2009 Linear Programming 0 20092010 Yearlong program VIGRE RFG on optimization 9 Optimization seminar 0 Reading courses 9 258A Fall 2009 Numerical Optimization 0 2588 Winter 2010 Variational Analysis and MixedInteger Nonlinear Programming 9 280 Spring 2010 Integer Programming 2042

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