CSE331 Lecture 36

# CSE331 Lecture 36 - Lecture 36 CSE 331 New Office 319 Davis...

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Unformatted text preview: Lecture 36 CSE 331 Nov 28, 2011 New Office: 319 Davis CSEd Week celebrations http://csedweek.wordpress.com/ Volunteers needed! Warning on blog posts/scribes AT MOST 3 blog posts (and scribe)/lecture Need volunteers for today A new experiment today Weighted Interval Scheduling Input: n jobs (si,ti,vi) Output: A schedule S s.t. no two jobs in S have a conflict Goal: max Σi in S vj Assume: jobs are sorted by their finish time Couple more definitions p(j) = largest i<j s.t. i does not conflict with j = 0 if no such i exists OPT(j) = optimal value on instance 1,..,j p(j) < j Property of OPT j in OPT(j) j not in OPT(j) OPT(j) = max { vj + OPT( p(j) ), OPT(j-1) } Given OPT(1),…., OPT(j1), how can one figure out if j in optimal solution or not? A recursive algorithm Compute-Opt(j) Correct for j=0 Proof of correctness by induction on j If j = 0 then return 0 return max { vj + Compute-Opt( p(j) ), Compute-Opt( j-1 ) } = OPT( p(j) ) = OPT( j-1 ) OPT(j) = max { vj + OPT( p(j) ), OPT(j-1) } Exponential Running Time 1 2 p(j) = j-2 3 4 Only 5 OPT values! 5 OPT( 5) OPT( 3) Formal proof: Ex. OPT( 1) OPT( 4) OPT( 2) OPT( 2) OPT( 1) OPT( 1) OPT( 3) OPT( 1) OPT( 2) OPT( 1) A recursive algorithm M-Compute-Opt(j) M-Compute-Opt(j) = OPT(j) If j = 0 then return 0 If M[j] is not null then return M[j] M[j] = max { vj + M-Compute-Opt( p(j) ), M-Compute-Opt( j-1 ) } return M[j] Run time = O(# recursive calls) Bounding # recursions M-Compute-Opt(j) If j = 0 then return 0 If M[j] is not null then return M[j] M[j] = max { vj + M-Compute-Opt( p(j) ), M-Compute-Opt( j-1 ) } return M[j] Whenever a recursive call is made an M value of assigned At most n values of M can be assigned O(n) overall Property of OPT OPT(j) = max { vj + OPT( p(j) ), OPT(j-1) } Given OPT(1), …, OPT(j-1), one can compute OPT(j) Recursion+ memory = Iteration Iteratively compute the OPT(j) values Iterative-Compute-Opt M[0] = 0 For j=1,…,n M[j] = max { vj + M[p(j)], M[j-1] } M[j] = OPT(j) O(n) run time Reading Assignment Sec 6.1, 6.2 of [KT] When to use Dynamic Programming There are polynomially many sub-problems Richard Bellman Optimal solution can be computed from solutions to sub-problems There is an ordering among sub-problem that allows for iterative solution Shortest Path Problem Input: (Directed) Graph G=(V,E) and for every edge e has a cost ce (can be <0) t in V Output: Shortest path from every s to t s Shortest path has cost negative infinity 1 1 899 100 -1000 t Assume that G has no negative cycle Today’s agenda Dynamic Program for shortest path May the Bellman force be with you ...
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## This note was uploaded on 12/11/2011 for the course CSE 331 taught by Professor Rudra during the Fall '11 term at SUNY Buffalo.

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