Source Coding Efficient Data Representation A.J. Han Vinck.

Source Coding

Efficient Data Representation

A.J. Han Vinck

DATA COMPRESSION / REDUCTION

• 1) INTRODUCTION- presentation of messages in Binary format- conversion into binary form

• 2) DATA COMPRESSION• Lossless - Data Compression without errors

• 3) DATA REDUCTION• Lossy – Data reduction using prediction and context

CONVERSION into DIGITAL FORM1 SAMPLING:

discrete exact time samples of the continuous (analoge) signal are produced

[v(t)] time v(t) discrete + amplitude discrete time

t t 01 11 10 10 T 2T 3T 4T

digital sample values sample rate R = 1/T

2 QUANTIZING: approximation(lossy) into a set discrete levels3 ENCODING: representation of a level by a binary symbol

HOW FAST SHOULD WE SAMPLE ?

principle:

- an analoge signal can be seen as a sum of sine waves

+

with some highest sine frequency Fh

- unique reconstruction from its (exact) samples if (Nyquist, 1928)

the sample Rate R = > 2 Fh

• We LIMIT the highest FREQUENCY of the SOURCE without introducing distortion!

EXAMPLES:text: represent every symbol with 8 bit

storage: 8 * (500 pages) * 1000 symbols = 4 Mbit compression possible to 1 Mbit (1:4)

speech: sampling speed 8000 samples/sec; accuracy 8 bits/sample; needed transmission speed 64 kBit/s compression possible to 4.8 kBit/s (1:10)

CD music: sampling speed 44.1 k samples/sec; accuracy 16 bits/sample needed storage capacity for one hour stereo: 5 Gbit 1250 books compression possible to 4 bits/sample ( 1:4 )

digital pictures: 300 x 400 pixels x 3 colors x 8 bit/sample 2.9 Mbit/picture; for 25 images/second we need 75 Mb/s

2 hour pictures need 540 Gbit 130.000 books compression needed (1:100)

we have to reduce the amount of data !!

using: prediction and context

- statistical properties- models- perceptual properties

LOSSLESS: remove redundancy exact !!

LOSSY: remove irrelevance with distortion !!

Shannon source coding theorem

• Assume – independent source outputs – Consider runs of outputs of length L

• we expect a certain “type of runs” and

– Give a code word for an expected run with prefix ‘1’– An unexpected run is transmitted as it appears with prefix ‘0’

• Example: throw dice 600 times, what do you expect?• Example: throw coin 100 times, what do you expect?

We start with a binary source

Assume: binary sequence x of length L

P(0) = 1 – P(1) = 1-p; t is the # of 1‘s

For L , and > 0 and as small as desired

Probability ( |t/L –p| > ) 0

i.e. Probability ( |t/L –p| ≤ ) 1- 1 (1) L(p- ) ≤ t ≤ L(p + ) with high probability

Consequence 1:

Let A be the set of typical sequences i.e. obeying (1)

for these sequences: |t/L –p| ≤

then, P(A) 1 ( as close as wanted, i.e. P(A) 1 - )

or: almost all observed sequences are typical and have about t ones

Note: we use the notation when we asume that L

Consequence 2:

Lh(p)| A | 2

( )( )

2 2 2 2 2( )

log | | log log (2 ) log 2 log 2L p

Lh p

L p

L LA L L

t Lp

The cardinality of the set A is

( )2 2

1 1log 2 log 2 ( )Lh pL h p

L L

Shannon 1

Encode

every vector in A with Nint L(h(p)+)+1 bits

every vector in Ac with L bits–Use a prefix to signal whether we have a typical sequence or not

The average codeword length:

K = (1- )[L(h(p)+) +1] + L + 1 L h(p) bits

Shannon 1: converse

source output words XL encoder Yk: k output bits/L input of length L symbols

H(X) =h(p); H(XL ) =Lh(p) k = L[h(p)-] > 0

encoder: assignment of 2L[h(p)-] –1 code words 0

or all zero code word

Pe = prob (all zero code word assigned) =Prob(error)

Shannon 1: converse

source output words XL encoder Yk: k output bits/L input of length L symbols

H(XL, Yk) = H(XL) + H(Yk | XL ) = Lh(p)

= H( Yk ) + H( XL | Yk )

L[h(p)-] + h(Pe) + Pe log2|source|

Lh(p) L[h(p)-] + 1 + L Pe Pe -1/L > 0 !

H(X) =h(p); H(XL ) =Lh(p) k = L[h(p)-] > 0

typicality

Homework:

Calculate for = 0.04 and p = 0.3

h(p), |A|, P(A), (1- )2L(h(p)-) , 2L(h(p)+)

as a function of L

Homework:

Repeat the same arguments for a more general source with entropy H(X)

Sources with independent outputs

• Let U be a source with independent outputs: U1 U2 UL subscript = time

The set of typical sequences can be defined as

Then:

for large L

2 22 2

22

log ( ) var ( log ( ))Pr | ( ) | }

var ( log ( ))0

L LP U iance P Uob H U

L Liance P U

L

2log ( ){ | ( ) | }

LL P U

A U H UL

Sources with independent outputs cont’d

To see how it works, we can write

|U||U|2211

|U|2|U|222121

iL

1i2L

2

PlogPPlogPPlogPL

PlogN

L

PlogN

L

PlogN

L

))U(Plog(

L

)U(Plog

|U||U|2211

|U|2|U|222121

iL

1i2L

2

PlogPPlogPPlogPL

PlogN

L

PlogN

L

PlogN

L

))U(Plog(

L

)U(Plog

where |U| is the size of the alphabet, Pi the probability that symbol i occurs, Ni the fraction of occurances of symbol i

Sources with independent outputs cont’d

• the cardinality of the set A 2LH(U)

• Proof:

( ( ) )2

( ( ) )

( ( ) )

log ( )| ( ) | } ( ) 2

1 ( ) | |2

| | 2

LL L H U

L L H U

A

L H U

P UH U P U

Land

p U A

hence

A

encoding

Encode

every vector in A with L(H(U)+)+1 bits

every vector in Ac with L bits

– Use a prefix to signal whether we have a typical sequence or not

The average codeword length:

K = (1- )[L(H(U)+) +1] + L +1 L H(U) +1 bits

converse

• For converse, see binary source

Sources with memoryLet U be a source with memory

Output: U1 U2 UL subscript = time

states: S {1,2, , |S|}

The entropy or minimum description length

H(U) = H(U1 U2 UL) (use the chain rule)

= H(U1)+ H(U2|U1 ) + + H( UL | UL-1 U2U1 )

H(U1)+ H(U2) + + H( UL) ( use H(X) H(X|Y)

)

How to calculate?

Stationary sources with memory

H( UL | UL-1 U2U1 ) H( UL | UL-1 U2 ) = H( UL-1 | UL-2 U1 )

stationarity

less memory increase the entropy

conclusion: there must be a limit for the innovation for large L

Cont‘d

H(U1 U2 UL)

= H(U1 U2 UL-1)+ H( UL | UL-1 U2U1 )

H(U1 U2 UL-1) +1/L[ H(U1) + H(U2| U1)+ + H(UL|UL-1 U2U1 )]

H(U1 U2 UL-1) + 1/L H(U1 U2 UL)

thus: 1/L H(U1 U2 UL) 1 /(L-1) H(U1 U2 UL-1)

conclusion: the normalized block entropy has a limit

Cont‘d

1/L H(U1 U2 UL) = 1/L[ H(U1)+ H(U2|U1 ) + + H( UL | UL-1 U2U1 )]

H( UL | UL-1 U2U1 )

conclusion: the normalized block entropy is innovation

H(U1 U2 UL+j) H( UL-1 U2U1 ) +(j+1) H( UL | UL-1 U2U1 )

conclusion: the limit ( large j) of the normalized block entropy innovation

THUS: limit normalized block entropy = limit innovation

Sources with memory: exampleNote: H(U) = minimum representation length

H(U) average length of a practical scheme

English Text: First approach consider words as symbols

Scheme: 1. count word frequencies

2. Binary encode words

3. Calculate average representation length

Conclusion: we need 12 bits/word; average wordlength 4.5 letter

H(english) 2.6 bit/letter

Homework: estimate the entropy of your favorite programming language

Example: Zipf‘s law

Procedure:

order the English words according to frequency of occurence

Zipf‘s law: frequency of the word at position n is Fn = A/n

for English A = 0.1 word frequency

word order

1 10 100 1000

1

0.1

0.01

0.001

Result: H(English) = 2.16 bits/letterIn General: Fn = a n-b where a and b are constants

Application: web-access, complexity of languages

Sources with memory: example

Another approach: H(U)= H(U1)+ H(U2|U1 ) + + H( UL | UL-1 U2U1 )

Consider text as stationary, i.e. the statistical properties are fixed

Measure: P(a), P(b), etc H(U1) 4.1

P(a|a), P(b|a), ... H(U2|U1 ) 3.6

P(a|aa), P(b|aa), ... H(U3| U2 U1 ) 3.3

...

Note: More given letters reduce the entropy.

Shannons experiments give as result that 0.6 H(english) 1.3

Example: Markov model

A Markov model has states: S { 1, , S }

State probabilities Pt (S=i)

Transitions t t+1 with probability P (st+1 =j| st =i)

Every transition determines a specific output, see example

i

k

jP (st+1 =j| st =i)

P (st+1 =k| st =i)

0

1

0 1

0

0

11

example

Pt(A)= ½

Pt (B)= ¼

Pt (C)= ¼

½ 0

¼ 1

¼ 2

A

B

C

A

B

C

P(A|B)=P(A|C)= ½

0

1

0

1

The entropy for this example = 1¼

Homework: check!

Homework: construct another example that is stationary and calculate H

Appendix to show (1)

For a binary sequence X of length n with P(Xi =1)=p

)x()p1(pp])x[(E:Use).p1(pn

1

])np()x(E[n

1p)x

n

1(E)y(E

then;pxn

1ylet

i222

i

2

n,1i

2i2

2

n,1i

2i

2

n,1ii

Because the Xi are independent, the variance of the sum = sum of the variances

2 2

2 22 2

2 2

( )Pr(| | ) Pr( ) Pr( )

| | | |

y

y E yy y y

ty p

n

Source Coding Efficient Data Representation A.J. Han Vinck.

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