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By Sanjeev Arora, Rong Ge (auth.), Leslie Ann Goldberg, Klaus Jansen, R. Ravi, José D. P. Rolim (eds.)

This ebook constitutes the joint refereed court cases of the 14th overseas Workshop on Approximation Algorithms for Combinatorial Optimization difficulties, APPROX 2011, and the fifteenth foreign Workshop on Randomization and Computation, RANDOM 2011, held in Princeton, New Jersey, united states, in August 2011.
The quantity offers 29 revised complete papers of the APPROX 2011 workshop, chosen from sixty six submissions, and 29 revised complete papers of the RANDOM 2011 workshop, chosen from sixty four submissions. They have been conscientiously reviewed and chosen for inclusion within the e-book. furthermore abstracts of invited talks are included.
APPROX specializes in algorithmic and complexity concerns surrounding the improvement of effective approximate strategies to computationally tricky difficulties. RANDOM is anxious with purposes of randomness to computational and combinatorial problems.

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Read or Download Approximation, Randomization, and Combinatorial Optimization. Algorithms and Techniques: 14th International Workshop, APPROX 2011, and 15th International Workshop, RANDOM 2011, Princeton, NJ, USA, August 17-19, 2011. Proceedings PDF

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Example text

In terms of Fig. 1, each grey rectangle, instead of being the code word from C specified in the figure, is instead a random code word from a larger code C . Note that each block has still O(log h) rows as before. A block is good if all codewords corresponding to it are distinct. Observe that for any given block, the probability it is not good is at most O(1/h). If there are fewer than O(h) blocks in all of D (j) , we could take a union bound over all of them to show that all blocks are good constant probability.

There is a Nash equilibrium (x, y) with both payoffs ≥ 1 − η. Soundness. Given any ε-equilibrium with value ≥ η, we can efficiently recover the hidden clique. 2 by describing a simple algorithm to find a 1 2 -approximate Nash equilibrium with at least as good value as the best exact Nash equilibrium. 1 is tight. For general 12 -approximate equilibria (without any constraint on the value), the following simple algorithm was suggested by Daskalakis, Mehta and Papadimitiou [DMP09]. Start by choosing an arbitrary pure strategy ei for the row player, let ej be the column player’s best response to ei , and let ek be the row player’s best response to ej .

2. Then for any pair of strategies (x, y) with value at least vG (x, y) ≥ α − t2 it holds that x[n] and y[n] are both at least 1 − t. 5 Let (x, y) be any pair of strategies with value vG (x, y) ≥ and x[n] > 0, y[n] > 0. Then vG|[n] (x, y) ≥ vG (x, y), provided that γ ≤ 12 . 3, we can now easily complete the proof of hardness for ε close to 12 . 1). For every η > 0 there exist δ = Ω(η 2 ), α ≥ 12 and universal constant C not depending on η such that the following holds. p. over G and G): Completeness.

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