Upload
magnus-lucas
View
226
Download
1
Embed Size (px)
Citation preview
Recurrence Equations
Algorithm : Design & Analysis
[4]
In the last class…
Recursive Procedures Analyzing the Recursive Computation. Induction over Recursive Procedures Proving Correctness of Procedures
Recurrence Equations
Recursive algorithm and recurrence equation
Solution of the Recurrence equations Guess and proving Recursion tree Master theorem
Divide-and-conquer
Recurrence Equation: Concept
A recurrence equation: defines a function over the natural number n in term of its own value at one or more integers
smaller than n Example: Fibonacci numbers
Fn=Fn-1+Fn-2 for n2
F0=0, F1=1
Recurrence equation is used to express the cost of recursive procedures.
Linear Homogeneous Relation
knmnnn ararara 2211
is called linear homogeneous relation of degree k.
1)2( nn cc 31 nn aa
21 nnn fff 22
1 nnn ggg
Yes No
Characteristic Equation
For a linear homogeneous recurrence relation of degree k
the polynomial of degree k
is called its characteristic equation.
The characteristic equation of linear homogeneous recurrence relation of degree 2 is:
knmnnn ararara 2211
kkkk rxrxrx 2
21
1
0212 rxrx
Solution of Recurrence Relation
If the characteristic equation of the
recurrence relation has two distinct
roots s1 and s2, then
where u and v depend on the initial conditions, is the
explicit formula for the sequence.
If the equation has a single root s, then, both s1 and s2 in
the formula above are replaced by s
0212 rxrx
2211 nnn arara
nnn vsusa 21
Fibonacci Sequence
f1=1
f2=1
fn= fn-1+ fn-2
f1=1
f2=1
fn= fn-1+ fn-2
1, 1, 2, 3, 5, 8, 13, 21, 34, ......
Explicit formula for Fibonacci Sequence The characteristic equation is x2-x-1=0, which has roots:
2
51
2
5121
sands
Note: (by initial conditions) 11 22
212211 vsusfandvsusf
which results:nn
nf
2
51
5
1
2
51
5
1
Determining the Upper Bound
Example: T(n)=2T(n/2) +n Guess
T(n)O(n)? T(n)cn, to be proved for c large enough
T(n)O(n2)? T(n)cn2, to be proved for c large enough
Or maybe, T(n)O(nlogn)? T(n)cnlogn, to be proved for c large enough
Try and fail to prove T(n)cn: T(n)=2T(n/2)+n 2c(n/2)+n 2c(n/2)+n = (c+1)n
T(n) = 2T(n/2)+n 2(cn/2 lg (n/2))+n cn lg (n/2)+n = cn lg n – cn log 2 +n = cn lg n – cn + n cn log n for c1Note
: the pro
of is i
nvalid
for T(1
)=1
Recursion Tree
T(size) nonrecursive cost
The recursion tree for T(n)=T(n/2)+T(n/2)+n
T(n) n
T(n/4) n/4T(n/4) n/4T(n/4) n/4T(n/4) n/4
T(n/2) n/2T(n/2) n/2
Recursion Tree Rules
Construction of a recursion tree work copy: use auxiliary variable root node expansion of a node:
recursive parts: children nonrecursive parts: nonrecursive cost
the node with base-case size
Recursion tree equation
For any subtree of the recursion tree, size field of root =
Σnonrecursive costs of expanded nodes +
Σsize fields of incomplete nodes Example: divide-and-conquer:
T(n) = bT(n/c) + f(n) After kth expansion:
1
0
)(k
ii
ik
k
c
nfb
c
nTbnT
Evaluation of a Recursion Tree
Computing the sum of the nonrecursive costs of all nodes.
Level by level through the tree down. Knowledge of the maximum depth of the
recursion tree, that is the depth at which the size parameter reduce to a base case.
Recursion Tree
T(n) n
T(n/4) n/4T(n/4) n/4T(n/4) n/4T(n/4) n/4
T(n/2) n/2T(n/2) n/2
Work copy: T(k)=T(k/2)+T(k/2)+kWork copy: T(k)=T(k/2)+T(k/2)+k
At this level: T(n)=n+2(n/2)+4T(n/4)=2n+4T(n/4)At this level: T(n)=n+2(n/2)+4T(n/4)=2n+4T(n/4)
n/2d(size 1)
T(n)=nlgn
Recursion Tree for T(n)=3T(n/4)+(n2)
cn2
T(1) T(1) T(1) T(1) T(1)T(1) T(1) T(1) T(1) T(1) T(1) T(1) T(1)
c(n/16)2c(n/16)2 c(n/16)2 c(n/16)2 c(n/16)2c(n/16)2 c(n/16)2 c(n/16)2c(n/16)2
…… ……
c(n/4)2 c(n/4)2 c(n/4)2
log4n
cn2
2
16
3cn
22
16
3cn
…
3log4n
Total: O(n2)Note: 3loglog 443 nn
Verifying “Guess” by Recursive Tree
)()(13
16
)(
163
1
1
)(16
3
)(16
3)(
23log2
3log2
0
3log2
1log
0
3log2
4
4
4
4
4
nOncn
ncn
ncn
ncnnT
i
i
n
i
i
cdwhendn
cndn
cnnd
cnnd
cnnTnT
13
1616
3
)4/(3
4/3
)4/(3)(
2
22
22
22
2
Inductive hypothesisInductive hypothesis
Common Recurrence Equation
Divide and Conquer T(n) = bT(n/c) + f(n)
Chip and Conquer T(n) = T(n - c) + f(n)
Chip and Be Conquered T(n) = bT(n - c) + f(n)
Recursion Tree for T(n)=bT(n/c)+f(n)
f(n)
T(1) T(1) T(1) T(1) T(1)T(1) T(1) T(1) T(1) T(1) T(1) T(1) T(1)
f(n/c2)f(n/c2) f(n/c2) f(n/c2) f(n/c2)f(n/c2) f(n/c2) f(n/c2)f(n/c2)
…… ……
f(n/c) f(n/c) f(n/c)
logcn
f(n)
)/( cnbf
)/( 22 cnfb
…
bcnlog
Note: bn cc nb loglog
b
b
Total ?
Solving the Divide-and-Conquer
The recursion equation for divide-and-conquer, the general case:T(n)=bT(n/c)+f(n)
Observations: Let base-cases occur at depth D(leaf), then
n/cD=1, that is D=lg(n)/lg(c) Let the number of leaves of the tree be L, then
L=bD, that is L=b(lg(n)/lg(c)). By a little algebra: L=nE, where E=lg(b)/lg(c),
called critical exponent.
c
bnb
c
n
bc
nc
n
bL lg
lglglg
lg
lg
lglg
lg
222lg
lg
c
bnb
c
n
bc
nc
n
bL lg
lglglg
lg
lg
lglg
lg
222lg
lg
Divide-and-Conquer: the Solution
The recursion tree has depth D=lg(n)/ lg(c), so there are about that many row-sums.
The 0th row-sum is f(n), the nonrecursive cost of the root.
The Dth row-sum is nE, assuming base cases cost 1, or (nE) in any event.
The solution of divide-and-conquer equation is the nonrecursive costs of all nodes in the tree, which is the sum of the row-sums.
Little Master Theorem
Complexity of the divide-and-conquer case 1: row-sums forming a geometric series:
T(n)(nE), where E is critical exponent
case 2: row-sums remaining about constant: T(n)(f(n)log(n))
case 3: row-sums forming a decreasing geometric series:
T(n)(f(n))
Master Theorem
Loosening the restrictions on f(n) Case 1: f(n)O(nE-), (>0), then:
T(n)(nE) Case 2: f(n)(nE), as all node depth
contribute about equally:T(n)(f(n)log(n))
case 3: f(n)(nE+), (>0), and f(n)O(nE+), (), then:
T(n)(f(n))
The positive is critical, resulting gaps between cases as well
The positive is critical, resulting gaps between cases as well
Using Master Theorem
)lg()(,3
)()(lg)(,793.03log,4,3
lg4
3)(3
)(lg)(,2),(1)(,0,2
3,1
13
2)(2
)()(,1),()(,2,3,9
39)(1
21.121.04
0
21
nnnTappliescase
nOnnnnfEcb
nnn
TnTExample
nnTappliescasennfEcb
nTnTExample
nnTappliescasenOnnfEcb
nn
TnTExample
EE
E
Looking at the Gap
T(n)=2T(n/2)+nlgn a=2, b=2, E=1, f(n)=nlgn We have f(n)=(nE), but no >0 satisfies
f(n)=(nE+), since lgn grows slower that n for any small positive .
So, case 3 doesn’t apply. However, neither case 2 applies.
0any for 0ln
lim
n
nn
Proof of the Master Theorem
)lg(/)lg(
0
)(cn
dd
d
c
nfbnT
dEdEd
E
d c
nf
c
n
c
nf
)lg(/)lg(
0
)lg(/)lg(
0
)()(
cn
dddEd
cn
d
d
c
nf
cc
nfbnT
(Note: in asymptotic analysis, f(n)(nE+) leads to f(n) is about (nE+), ignoring the coefficients.
(Note: in asymptotic analysis, f(n)(nE+) leads to f(n) is about (nE+), ignoring the coefficients.
Case 3 as an example
Decreasing geo. series
Home Assignment
pp.143- 3.7 3.8 3.9 3.10