ptas via local search
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PTAS via Local Search. Rom Aschner and Or Caspi. Outline. Today you will see PTAS for: Geometric Minimum Hitting Set Terrain Guarding Maximum Independent Set of Pseudo Disks Minimum Dominating Set of Disk Graphs - PowerPoint PPT PresentationTRANSCRIPT
PTAS VIA LOCAL SEARCHRom Aschner and Or Caspi
Outline Today you will see PTAS for:
Geometric Minimum Hitting Set Terrain Guarding Maximum Independent Set of Pseudo Disks Minimum Dominating Set of Disk Graphs
Using the technique discovered independently by Har-Peled & Chan (2009) and Mustafa & Ray (2009)
Mustafa and Ray, 2009
Minimum hitting set problem
Minimum hitting set problem Given a range space , The goal: compute the smallest that
has non empty intersection with each NP-Hard to approximate within a factor of
Minimum hitting set problem For many geometric range spaces the
problem remains NP-hard. For example:
P – set of points, D – set of unit disks
Minimum hitting set problem For many geometric range spaces the
problem remains NP-hard. For example:
P – set of points, D – set of disks
Minimum hitting set problem For many geometric range spaces the
problem remains NP-hard. For example:
P – set of points, H – set of half-spaces in .
Minimum hitting set problem
PTAS (Mustafa & Ray, 2009)
The -level local search algorithm S While there is a subset of size that can
be replaced with subset of size s.t. is a hitting set. Then preform the swap Else, halt.
Example:
The -level local search algorithm Running Time:
The number of iterations is bounded by . There are at most different local
improvements to verify. Checking whether a certain local
improvement is possible takes . The overall running time is
- the set of points in the optimal solution - the set of points in the algorithm’s
output Assume:
We want to prove that
Approximation Analysis
𝑅∩𝐵≠∅ We will see that Thus
satisfies the locality condition if for any two disjoint subsets , it is possible to construct a planar bipartite graph s.t. for any , if and , then there exists two vertices and such that .
Locality condition
The planar bipartite graph is the Delaunay Triangulation of without monochromatic edges.
Locality condition in disks
For each disk , if and , then there exists two vertices and such that .
Locality condition in our graph
The locality condition holds!!
Lemma: for any , is a hitting set of Proof:
If is only hit by the blue points in then one of them has red neighbor that hits
Otherwise, is hit by some point in
Locality condition
- the set of points in the optimal solution - the set of points in the algorithm’s
output satisfies the locality condition We want to prove that The proof is based on the “Separation
lemma” (Fredrickson 1987)
Approximation Analysis
Separation lemma (Fredrickson 1987): For any planar graph and a parameter , we can find a set of size at most and partition of into sets satisfying:
for
Separation lemma
𝑺
Example : Then, we can find a set of size at most and a
partition of into sets satisfying:
for
Separation lemma
𝑂 (𝑛)
𝑂 (𝑛)
𝑂 (√𝑛)
How can this separation lemma help us ?? We have a planar graph of This graph can be separated into disjoint subsets Next, we will see that by choosing the correct
value of the number of blue points inside each subset is not too big than the number of red points.
Using this observation, we will get that |
Approximation Analysis
Let and Applying we have:
Assume, replace with – contradiction.
Approximation AnalysisFrom the locality condition lemma:If is a hitting set of X then is also a hitting set of X
Therefore,
, and large enough constant
Approximation Analysis
-approximation We proved the following theorem:
Let be a set of points and a set of disks. Then a -level local search algorithm returns a hitting set of size at most in Time.
True also for different regions, such as: Same height rectangles Translates of convex shapes …
Gibson, Kanade, Krohn and Varadarajan, 2009
Terrain Guarding
Terrain A polygonal chain in the plane that is x-
monotone.
Terrain Guarding
G: Possible Guard locations X: Target points that need to be guarded
Terrain Guarding
Objective: find smallest subset of guards such that every point is seen by at least one guard
Terrain Guarding
Terrain Guarding Previous results:
NP-Hard 4-approximation
Applications: Placing guards/cameras along borders Constructing line-of-sight networks for radio
broadcasting Placing street lights along roads Placing fire trucks on the Carmel mountain …
The -level local search algorithm
While there is a subset of size that can be replaced with subset of size s.t. guards . Then preform the swap Else, halt.
Terrain Guarding via local search - the set of guards in the optimal solution - the set of guards in the algorithm’s output We can assume that We want to prove that the locality condition
holds. This means we need to find a planar bipartite
graph in which for each , there is an edge between guards and that both see .
As before, using the separation lemma on this graph will show that
- the leftmost guard that sees among points in
For every guard, we shoot a ray upwards. Let be the first segment in A1 that it hits.
Construction 1
x1
x2
x3
v1
v2
v3
v4 v5
Construction 1 Why are there no crossing edges? Thanks to the ‘order claim’:
Let be four points on the terrain in increasing order according to -coordinate. If sees and sees
Then sees .A
B
C
D
Construction 2 - The flip Create and in the same way, using the rightmost guards What if the new edges cross the previous ones?
x1
x2
x3
v1
v2v3
v4 v5
Construction 3 Finally, for every point x, add an edge in if they are of
opposite colors. Embed this edge along and to remain planar. The final graph is , planar bipartite.
x1
x2
x3
v1
v2
v3
v4 v5
Locality condition Still need to show that the locality
condition holds: For every point there are guards and that both see and they are connected in G.
If and are of opposite colors, we are done because they are connected in .𝝀 (𝒙)
𝝆 (𝒙)
x
Locality condition Otherwise, assume w.l.g. there are only guards to
the left of , and that is red. Since both and guard , there is also a blue
guard that sees , call the leftmost one . Because is between and , is above . If it also the first such segment, then
x𝜆 (𝑥)
b
Locality condition Otherwise, let be the first segment in above . From the order claim on sees . From the choice of as the leftmost blue guard
that sees , is red!
x
y
𝜆 (𝑥)
b
𝜆 ( 𝑦 )
Chan & Har-Peled, 2009
Independent Set
A set of objects is a collection of pseudo-disks, if the boundary of every pair of them intersects at most twice.
Max Independent Set of Pseudo Disks
Intersection graph – there is an edge between two pseudo-disks if they intersect
Max Independent Set of Pseudo Disks
Max independent set– no pair of objects intersect
Max Independent Set of Pseudo Disks
The bipartite graph is simply the Intersection graph of
Is it planar ? Yes Embed the edges
along the intersections Locality condition ? Yes
If any two red-blue pseudo disks intersect then
Max Independent Set of Pseudo Disks
Gibson & Pirwani, 2010
Dominating Set
Min. Dominating Set of Disk Graphs
Intersection graph – there is an edge between to points if their disks intersect
Min. Dominating Set of Disk Graphs
Minimum Dominating Set - the smallest subset s.t. each vertex is either in or is adjacent to vertex in
Probably yes….
More ?