# Application to Digital Signal Transmission

## Information-theoretical model of digital signal transmission

The entropies defined so far in general terms are now applied to digital signal transmission, whereby we assume a discrete memoryless channel  (DMC)  according to the graphic:

Digital signal transmission model under consideration
• The set of possible source symbols is characterised by the discrete random variable  $X$ , where  $|X|$  indicates the source symbol range:
$$X = \{\hspace{0.05cm}x_1\hspace{0.05cm}, \hspace{0.15cm} x_2\hspace{0.05cm},\hspace{0.15cm} \text{...}\hspace{0.1cm} ,\hspace{0.15cm} x_{\mu}\hspace{0.05cm}, \hspace{0.15cm}\text{...}\hspace{0.1cm} , \hspace{0.15cm} x_{|X|}\hspace{0.05cm}\}\hspace{0.05cm}.$$
• Correspondingly,  $Y$  characterises the set of sink symbols with the symbol range  $|Y|$:
$$Y = \{\hspace{0.05cm}y_1\hspace{0.05cm}, \hspace{0.15cm} y_2\hspace{0.05cm},\hspace{0.15cm} \text{...}\hspace{0.1cm} ,\hspace{0.15cm} y_{\kappa}\hspace{0.05cm}, \hspace{0.15cm}\text{...}\hspace{0.1cm} , \hspace{0.15cm} Y_{|Y|}\hspace{0.05cm}\}\hspace{0.05cm}.$$
• Usually  $|Y| = |X|$is valid.  Also possible is  $|Y| > |X|$, for example with the  Binary Erasure Channel  (BEC) with  $X = \{0,\ 1\}$,  $Y = \{0,\ 1,\ \ \text{E}\}$   ⇒   $|X| = 2$,  $|Y| = 3$.
• The sink symbol  $\rm E$  indicates an erasure.  The event  $Y=\text{E}$  indicates that a decision for  $0$  or for  $1$  would be too uncertain.
• The symbol probabilities of the source and sink are accounted for in the graph by the probability functions  $P_X(X)$  and  $P_Y(Y)$ , where:
$$P_X(x_{\mu}) = {\rm Pr}( X = x_{\mu})\hspace{0.05cm}, \hspace{0.3cm} P_Y(y_{\kappa}) = {\rm Pr}( Y = y_{\kappa})\hspace{0.05cm}.$$
• Let it hold:   $P_X(X)$  and  $P_Y(Y)$  contain no zeros   ⇒   $\text{supp}(P_X) = P_X$  and  $\text{supp}(P_Y) = P_Y$.
This precondition facilitates the model description without loss of generality.
• All transition probabilities of the discrete memoryless channel   $\rm (DMC)$  are captured by the  conditional probability function  $P_{Y|X}(Y|X)$ .
Mit  $x_μ ∈ X$  and  $y_κ ∈ Y$ , the following definition applies to this:
$$P_{Y\hspace{0.01cm}|\hspace{0.01cm}X}(y_{\kappa}\hspace{0.01cm} |\hspace{0.01cm} x_{\mu}) = {\rm Pr}(Y\hspace{-0.1cm} = y_{\kappa}\hspace{0.03cm} | \hspace{0.03cm}X \hspace{-0.1cm}= x_{\mu})\hspace{0.05cm}.$$

The green block in the graph marks  $P_{Y|X}(⋅)$  with  $|X|$  inputs and  $|Y|$  outputs.  Blue connections mark transition probabilities  $\text{Pr}(y_i | x_μ)$  starting from  $x_μ$  with  $1 ≤ i ≤ |Y|$, while all red connections end at  $y_κ$:    $\text{Pr}(y_κ | x_i)$  with  $1 ≤ i ≤ |X|$.

Before we give the entropies for the individual probability functions, viz.

$$P_X(X) ⇒ H(X),\hspace{0.5cm} P_Y(Y) ⇒ H(Y), \hspace{0.5cm} P_{XY}(X) ⇒ H(XY), \hspace{0.5cm} P_{Y|X}(Y|X) ⇒ H(Y|X),\hspace{0.5cm} P_{X|Y}(X|Y) ⇒ H(X|Y),$$

the above statements are to be illustrated by an example.

Digital Channel Model Binary Erasure Channel

$\text{Example 1}$:  In the book "Channel Coding" we also deal with the  Binary Erasure Channel  $\rm (BEC)$, which is sketched in a somewhat modified form on the right.   The following prerequisites apply:

• Let the input alphabet be binary  ⇒   $X = \{0,\ 1 \}$   ⇒   $\vert X\vert = 2$while three values are possible at the output   ⇒   $Y = \{0,\ 1,\ \text{E} \}$   ⇒   $\vert Y\vert = 3$.
• The symbol  $\text{E}$  indicates the case that the receiver cannot decide for one of the binary symbols  $0$  or  $1$  due to too much channel interference.  „E” stands for erasure.
• With the  $\rm BEC$  according to the above sketch, both a transmitted  $0$  and a  $1$  are erased with probability  $λ$  while the probability of a correct transmission is  $1 – λ$  in each case.
• In contrast, transmission errors are excluded by the BEC model
⇒   the conditional probabilities  $\text{Pr}(Y = 1 \vert X = 0)$  and  $\text{Pr}(Y = 0 \vert X = 1)$  are both zero.

At the transmitter, the zeros and ones would not necessarily be equally probable.  Rather, we use the probability functions

\begin{align*}P_X(X) & = \big ( {\rm Pr}( X = 0)\hspace{0.05cm},\hspace{0.2cm} {\rm Pr}( X = 1) \big )\hspace{0.05cm},\\ P_Y(Y) & = \big ( {\rm Pr}( Y = 0)\hspace{0.05cm},\hspace{0.2cm} {\rm Pr}( Y = 1)\hspace{0.05cm},\hspace{0.2cm} {\rm Pr}( Y = {\rm E}) \big )\hspace{0.05cm}.\end{align*}

From the above model we then get:

\begin{align*}P_Y(0) & = {\rm Pr}( Y \hspace{-0.1cm} = 0) = P_X(0) \cdot ( 1 - \lambda)\hspace{0.05cm}, \\ P_Y(1) & = {\rm Pr}( Y \hspace{-0.1cm} = 1) = P_X(1) \cdot ( 1 - \lambda)\hspace{0.05cm}, \\ P_Y({\rm E}) & = {\rm Pr}( Y \hspace{-0.1cm} = {\rm E}) = P_X(0) \cdot \lambda \hspace{0.1cm}+\hspace{0.1cm} P_X(1) \cdot \lambda \hspace{0.05cm}.\end{align*}

If we now take  $P_X(X)$  and  $P_Y(Y)$  to be vectors, the result can be represented as follows:

$$P_{\hspace{0.05cm}Y}(Y) = P_X(X) \cdot P_{\hspace{0.05cm}Y\hspace{-0.01cm}\vert \hspace{-0.01cm}X}(Y\hspace{-0.01cm} \vert \hspace{-0.01cm} X) \hspace{0.05cm},$$

where the transition probabilities  $\text{Pr}(y_κ\vert x_μ)$  are accounted for by the following matrix:

$$P_{\hspace{0.05cm}Y\hspace{-0.01cm} \vert \hspace{-0.01cm}X}(Y\hspace{-0.01cm} \vert \hspace{-0.01cm} X) = \begin{pmatrix} 1 - \lambda & 0 & \lambda\\ 0 & 1 - \lambda & \lambda \end{pmatrix}\hspace{0.05cm}.$$

Note:

• We have chosen this representation only to simplify the description.
• $P_X(X)$  and  $P_Y(Y)$  are not vectors in the true sense and  $P_{Y \vert X}(Y\vert X)$  is not a matrix either.

## Directional diagram for digital signal transmission

All entropies defined in the  last chapter  also apply to digital signal transmission.  However, it is expedient to choose the right-hand diagram instead of the diagram used so far, corresponding to the left-hand diagram, in which the direction from source  $X$  to sink  $Y$  is recognisable.

Two Information-Theoretical Models for Digital Signal Transmission

Let us now interpret the right graph starting from the general   DMC channel model  :

• The  source entropy  $H(X)$  denotes the average information content of the source symbol sequence.   With the symbol range  $|X|$  applies:
$$H(X) = {\rm E} \left [ {\rm log}_2 \hspace{0.1cm} \frac{1}{P_X(X)}\right ] \hspace{0.1cm} = -{\rm E} \big [ {\rm log}_2 \hspace{0.1cm}{P_X(X)}\big ] \hspace{0.2cm} =\hspace{0.2cm} \sum_{\mu = 1}^{|X|} P_X(x_{\mu}) \cdot {\rm log}_2 \hspace{0.1cm} \frac{1}{P_X(x_{\mu})} \hspace{0.05cm}.$$
• The  equivocation  $H(X|Y)$  indicates the average information content that an observer who knows exactly about sink  $Y$  gains by observing source  $X$ :
$$H(X|Y) = {\rm E} \left [ {\rm log}_2 \hspace{0.1cm} \frac{1}{P_{\hspace{0.05cm}X\hspace{-0.01cm}|\hspace{-0.01cm}Y}(X\hspace{-0.01cm} |\hspace{0.03cm} Y)}\right ] \hspace{0.2cm}=\hspace{0.2cm} \sum_{\mu = 1}^{|X|} \sum_{\kappa = 1}^{|Y|} P_{XY}(x_{\mu},\hspace{0.05cm}y_{\kappa}) \cdot {\rm log}_2 \hspace{0.1cm} \frac{1}{P_{\hspace{0.05cm}X\hspace{-0.01cm}|\hspace{0.03cm}Y} (\hspace{0.05cm}x_{\mu}\hspace{0.03cm} |\hspace{0.05cm} y_{\kappa})} \hspace{0.05cm}.$$
• The equivocation is the portion of the source entropy  $H(X)$ that is lost due to channel interference  (for digital channel: transmission errors)  .  The mutual information $I(X; Y)$ remains, which reaches the sink:
$$I(X;Y) = {\rm E} \left [ {\rm log}_2 \hspace{0.1cm} \frac{P_{XY}(X, Y)}{P_X(X) \cdot P_Y(Y)}\right ] \hspace{0.2cm} = H(X) - H(X|Y) \hspace{0.05cm}.$$
• The  irrelevance  $H(Y|X)$  indicates the average information content that an observer who knows exactly about the source  $X$  gains by observing the sink  $Y$ :
$$H(Y|X) = {\rm E} \left [ {\rm log}_2 \hspace{0.1cm} \frac{1}{P_{\hspace{0.05cm}Y\hspace{-0.01cm}|\hspace{-0.01cm}X}(Y\hspace{-0.01cm} |\hspace{0.03cm} X)}\right ] \hspace{0.2cm}=\hspace{0.2cm} \sum_{\mu = 1}^{|X|} \sum_{\kappa = 1}^{|Y|} P_{XY}(x_{\mu},\hspace{0.05cm}y_{\kappa}) \cdot {\rm log}_2 \hspace{0.1cm} \frac{1}{P_{\hspace{0.05cm}Y\hspace{-0.01cm}|\hspace{0.03cm}X} (\hspace{0.05cm}y_{\kappa}\hspace{0.03cm} |\hspace{0.05cm} x_{\mu})} \hspace{0.05cm}.$$
• The  sink entropy  $H(Y)$, the mean information content of the sink, is the sum of the useful mutual information  $I(X; Y)$  and the irrelevance  $H(Y|X)$, which comes exclusively from channel errors:
$$H(Y) = {\rm E} \left [ {\rm log}_2 \hspace{0.1cm} \frac{1}{P_Y(Y)}\right ] \hspace{0.1cm} = -{\rm E} \big [ {\rm log}_2 \hspace{0.1cm}{P_Y(Y)}\big ] \hspace{0.2cm} =I(X;Y) + H(Y|X) \hspace{0.05cm}.$$

## Calculation of the mutual information for the binary channel

These definitions will now be illustrated by an example.   We deliberately avoid simplifying the calculations by exploiting symmetries.

General model of the binary channel

$\text{Example 2}$:  We consider the general binary channel without memory according to the sketch.  Let the falsification probabilities be:

\begin{align*}\varepsilon_0 & = {\rm Pr}(Y\hspace{-0.1cm} = 1\hspace{0.05cm}\vert X \hspace{-0.1cm}= 0) = 0.01\hspace{0.05cm},\\ \varepsilon_1 & = {\rm Pr}(Y\hspace{-0.1cm} = 0\hspace{0.05cm} \vert X \hspace{-0.1cm}= 1) = 0.2\hspace{0.05cm}\end{align*}
$$\Rightarrow \hspace{0.3cm} P_{\hspace{0.05cm}Y\hspace{-0.01cm} \vert \hspace{-0.01cm}X}(Y\hspace{-0.01cm} \vert \hspace{-0.01cm} X) = \begin{pmatrix} 1 - \varepsilon_0 & \varepsilon_0\\ \varepsilon_1 & 1 - \varepsilon_1 \end{pmatrix} = \begin{pmatrix} 0.99 & 0.01\\ 0.2 & 0.8 \end{pmatrix} \hspace{0.05cm}.$$

Furthermore, we assume source symbols that are not equally probable:

$$P_X(X) = \big ( p_0, p_1 \big )= \big ( 0.1,\ 0.9 \big ) \hspace{0.05cm}.$$

With the  binary entropy function  $H_{\rm bin}(p)$ , we thus obtain for the source entropy:

$$H(X) = H_{\rm bin} (0.1) = 0.4690 \,{\rm bit} \hspace{0.05cm}.$$

For the probability function of the sink as well as for the sink entropy we thus obtain:

$$P_Y(Y) = \big [ {\rm Pr}( Y\hspace{-0.1cm} = 0)\hspace{0.05cm}, \ {\rm Pr}( Y \hspace{-0.1cm}= 1) \big ] = \big ( p_0\hspace{0.05cm},\ p_1 \big ) \cdot \begin{pmatrix} 1 - \varepsilon_0 & \varepsilon_0\\ \varepsilon_1 & 1 - \varepsilon_1 \end{pmatrix}$$
\begin{align*}\Rightarrow \hspace{0.3cm} {\rm Pr}( Y \hspace{-0.1cm}= 0)& = p_0 \cdot (1 - \varepsilon_0) + p_1 \cdot \varepsilon_1 = 0.1 \cdot 0.99 + 0.9 \cdot 0.2 = 0.279\hspace{0.05cm},\\ {\rm Pr}( Y \hspace{-0.1cm}= 1) & = 1 - {\rm Pr}( Y \hspace{-0.1cm}= 0) = 0.721\end{align*}
$$\Rightarrow \hspace{0.2cm} H(Y) = H_{\rm bin} (0.279) = 0.8541 \,{\rm bit} \hspace{0.05cm}.$$

The joint probabilities  $p_{\mu \kappa} = \text{Pr}\big[(X = μ) ∩ (Y = κ)\big]$  between source and sink are:

\begin{align*}p_{00} & = p_0 \cdot (1 - \varepsilon_0) = 0.099\hspace{0.05cm},\hspace{0.5cm}p_{01}= p_0 \cdot \varepsilon_0 = 0.001\hspace{0.05cm},\\ p_{10} & = p_1 \cdot (1 - \varepsilon_1) = 0.180\hspace{0.05cm},\hspace{0.5cm}p_{11}= p_1 \cdot \varepsilon_1 = 0.720\hspace{0.05cm}.\end{align*}

From this one obtains for

• the  joint entropy:
$$H(XY) = p_{00}\hspace{-0.05cm} \cdot \hspace{-0.05cm}{\rm log}_2 \hspace{0.05cm} \frac{1}{p_{00} \rm } + p_{01} \hspace{-0.05cm} \cdot \hspace{-0.05cm}{\rm log}_2 \hspace{0.05cm} \frac{1}{p_{01} \rm } + p_{10}\hspace{-0.05cm} \cdot \hspace{-0.05cm} {\rm log}_2 \hspace{0.05cm} \frac{1}{p_{10} \rm } + p_{11} \hspace{-0.05cm} \cdot \hspace{-0.05cm} {\rm log}_2\hspace{0.05cm} \frac{1}{p_{11}\rm } = 1.1268\,{\rm bit} \hspace{0.05cm},$$
• the  mutual information:
$$I(X;Y) = H(X) + H(Y) - H(XY) = 0.4690 + 0.8541 - 1.1268 = 0.1963\,{\rm bit} \hspace{0.05cm},$$
Informationstheoretisches Modell des betrachteten Binärkanals
• the  equivocation:
$$H(X \vert Y) \hspace{-0.01cm} =\hspace{-0.01cm} H(X) \hspace{-0.01cm} -\hspace{-0.01cm} I(X;Y) \hspace{-0.01cm}$$
$$\Rightarrow \hspace{0.3cm} H(X \vert Y) \hspace{-0.01cm} = \hspace{-0.01cm} 0.4690\hspace{-0.01cm} -\hspace{-0.01cm} 0.1963\hspace{-0.01cm} =\hspace{-0.01cm} 0.2727\,{\rm bit} \hspace{0.05cm},$$
• the irrelevance:
$$H(Y \vert X) = H(Y) - I(X;Y)$$
$$\Rightarrow \hspace{0.3cm} H(Y \vert X) = 0.8541 - 0.1963 = 0.6578\,{\rm bit} \hspace{0.05cm}.$$

The results are summarised in the graph.

Notes:

• The equivocation and irrelevance could also have been calculated directly (but with extra effort) from the corresponding probability functions.
• For example, the irrelevance:
$$H(Y|X) = \hspace{-0.2cm} \sum_{(x, y) \hspace{0.05cm}\in \hspace{0.05cm}XY} \hspace{-0.2cm} P_{XY}(x,\hspace{0.05cm}y) \cdot {\rm log}_2 \hspace{0.1cm} \frac{1}{P_{\hspace{0.05cm}Y\hspace{-0.01cm}|\hspace{0.03cm}X} (\hspace{0.05cm}y\hspace{0.03cm} |\hspace{0.05cm} x)}= p_{00} \cdot {\rm log}_2 \hspace{0.1cm} \frac{1}{1\hspace{-0.08cm} - \hspace{-0.08cm}\varepsilon_0} + p_{01} \cdot {\rm log}_2 \hspace{0.1cm} \frac{1}{\varepsilon_0} + p_{10} \cdot {\rm log}_2 \hspace{0.1cm} \frac{1}{1\hspace{-0.08cm} - \hspace{-0.08cm}\varepsilon_1} + p_{11} \cdot {\rm log}_2 \hspace{0.1cm} \frac{1}{\varepsilon_1} = 0.6578\,{\rm bit} \hspace{0.05cm}.$$

## Definition and meaning of channel capacity

We further consider a discrete memoryless channel  (DMC)  with a finite number of source symbols   ⇒   $|X|$  and also only finitely many sink symbols   ⇒   $|Y|$, , as shown in the first section of this chapter.

• If one calculates the mutual information  $I(X, Y)$  as last explained in  $\text{example 2}$  ausgeführt,  it also depends on the source statistic   ⇒   $P_X(X)$  .
• Ergo:   The mutual information  $I(X, Y)$  is not a pure channel characteristic.

$\text{Definition:}$  The   channel capacity introduced by  Claude E. Shannon  according to his standard work  [Sha48][1] reads:

$$C = \max_{P_X(X)} \hspace{0.15cm} I(X;Y) \hspace{0.05cm}.$$

Since according to this definition the best possible source statistics are always the basis,    $C$  depends only on the channel properties   ⇒   $P_{Y \vert X}(Y \vert X)$ ab, , but not on the source statistics   ⇒   $P_X(X)$.  Often the additional unit „bit/channel use” .

Shannon needed the channel description quantity  $C$  to formulate the channel coding theorem – one of the highlights of the information theory he founded.

$\text{Shannon's channel coding theorem: }$

• For every transmission channel with channel capacity  $C > 0$ , there exists (at least) one  $(k, n)$–block code,  whose (block) error probability approaches zero  as long as the code rate  $R = k/n$  is less than or equal to the channel capacity:
$$R ≤ C.$$
• The prerequisite for this, however,  is that the following applies to the block length of this code:
$$n → ∞.$$

The proof of this theorem,  which is beyond the scope of our learning tutorial,  can be found for example in  [CT06][2],  [Kra13][3]  und  [Meck09][4].

As will be shown in  task 3.13 ,   the reverse also is true.  This proof can also be found in the literature references just mentioned.

$\text{Reverse of Shannon's channel coding theorem: }$

If the rate  $R$  of the  $(n$, $k)$–block code used is greater than the channel capacity  $C$,  then an arbitrarily small block error probability is not achievable.

In the chapter  AWGN model for discrete-time band-limited signals  it is explained in connection with the continuous-value  AWGN channel model    what phenomenally great significance Shannon's information-theoretical theorem has for the entire field of information technology,  not only for those interested exclusively in theory,  but also for practitioners.

## Channel capacity of a binary channel

General model of the binary channel

The mutual information of the general (asymmetrical) binary channel according to this sketch was calculated in  $\text{example 2}$  .  In this model, the input symbols  $0$  and  $1$  are distorted to different degrees:

$$P_{\hspace{0.05cm}Y\hspace{-0.01cm}|\hspace{-0.01cm}X}(Y\hspace{-0.01cm} |\hspace{-0.01cm} X) = \begin{pmatrix} 1 - \varepsilon_0 & \varepsilon_0\\ \varepsilon_1 & 1 - \varepsilon_1 \end{pmatrix} \hspace{0.05cm}.$$

The mutual information can be represented with the probability function  $P_X(X) = (p_0,\ p_1)$  as follows:

$$I(X ;Y) = \sum_{\mu = 1}^{2} \hspace{0.1cm}\sum_{\kappa = 1}^{2} \hspace{0.2cm} {\rm Pr} (\hspace{0.05cm}y_{\kappa}\hspace{0.03cm} |\hspace{0.05cm} x_{\mu}) \cdot {\rm Pr} (\hspace{0.05cm}x_{\mu}\hspace{0.05cm})\cdot {\rm log}_2 \hspace{0.1cm} \frac{{\rm Pr} (\hspace{0.05cm}y_{\kappa}\hspace{0.03cm} |\hspace{0.05cm} x_{\mu})}{{\rm Pr} (\hspace{0.05cm}y_{\kappa})}$$
\begin{align*}\Rightarrow \hspace{0.3cm} I(X ;Y) &= \hspace{-0.01cm} (1 \hspace{-0.08cm}- \hspace{-0.08cm}\varepsilon_0) \cdot p_0 \cdot {\rm log}_2 \hspace{0.1cm} \frac{1 \hspace{-0.08cm}- \hspace{-0.08cm}\varepsilon_0}{(1 \hspace{-0.08cm}- \hspace{-0.08cm}\varepsilon_0) \cdot p_0 + \varepsilon_1 \cdot p_1} + \varepsilon_0 \cdot p_0 \cdot {\rm log}_2 \hspace{0.1cm} \frac{\varepsilon_0}{(1 \hspace{-0.08cm}- \hspace{-0.08cm}\varepsilon_0) \cdot p_0 + \varepsilon_1 \cdot p_1} + \\ & + \hspace{-0.01cm} \varepsilon_1 \cdot p_1 \cdot {\rm log}_2 \hspace{0.1cm} \frac{\varepsilon_1}{\varepsilon_0 \cdot p_0 + (1 \hspace{-0.08cm}- \hspace{-0.08cm}\varepsilon_1) \cdot p_1} + (1 \hspace{-0.08cm}- \hspace{-0.08cm}\varepsilon_1) \cdot p_1 \cdot {\rm log}_2 \hspace{0.1cm} \frac{1 \hspace{-0.08cm}- \hspace{-0.08cm}\varepsilon_1}{\varepsilon_0 \cdot p_0 + (1 \hspace{-0.08cm}- \hspace{-0.08cm}\varepsilon_1) \cdot p_1} \hspace{0.05cm}.\end{align*}
Mutual information for the
"asymmetrical binary channel"

$\text{Example 3}$:  In the following we set  $ε_0 = 0.01$  and  $ε_1 = 0.2$.

Column 4 of the adjacent table shows (highlighted in green) the transinformation  $I(X; Y)$  of this asymmetrical binary channel depending on the source symbol probability  $p_0 = {\rm Pr}(X = 0)$  .  One can see:

• The mutual information depends on the symbol probabilities $p_0$ und $p_1 = 1 - p_0$ ab.
• The maximum value of  $I(X; Y)$  here results in  $p_0 ≈ 0.55$    ⇒    $p_1 ≈ 0.45$.
• The result  $p_0 > p_1$  follows from the relation  $ε_0 < ε_1$  (the zero is less distorted).
• The capacity of this channel is  $C = 0.5779 \ \rm bit/use$.

In the above equation, the  Binary Symmetric Channel  $\rm (BSC)$  with parameters  $ε = ε_0 = ε_1$  is also included as a special case.  Hints:

• In  task 3.10  the mutual information of the BSC channel is calculated for the system parameters  $ε = 0.1$  and  $p_0 = 0.2$  .
• In  task 3.10Z  its channel capacity is given as follows:
$$C_{\rm BSC} = 1 - H_{\rm bin} (\varepsilon) \hspace{0.05cm}.$$

## Properties of symmetrical channels

The capacity calculation of the (general)  discrete memoryless channel  is often complex.  It simplifies decisively if symmetries of the channel are exploited.

The diagram shows two examples:

• In the case of the  uniformly dispersive channel  all source symbols  $x ∈ X$  result in exactly the same set of transition probabilities   ⇒   $\{P_{Y\hspace{0.03cm}|\hspace{0.01cm}X}(y_κ\hspace{0.05cm}|\hspace{0.05cm}x)\}$  with  $1 ≤ κ ≤ |Y|$.  For the values  $q$,  $r$,  $s$ ,  $q + r + s = 1$  must always apply here (left graph).
• In the case of the  uniformly focusing channel , the same set of transition probabilities  ⇒   $\{P_{Y\hspace{0.03cm}|\hspace{0.01cm}X}(y\hspace{0.05cm}|\hspace{0.05cm}x_μ)\}$  with  $1 ≤ μ ≤ |X|$ results for all sink symbols  $y ∈ Y$ .   Here,  $t + u + v = 1$  need not necessarily hold (right graph).
Examples of symmetrical channels

$\text{Definition:}$  If a discrete memoryless channel is both uniformly dispersive and uniformly focussing,  it is a  strongly symmetric channel vor.  With an equally distributed source alphabet, this has the capacity

$$C = {\rm log}_2 \hspace{0.1cm} \vert Y \vert + \sum_{y \hspace{0.05cm}\in\hspace{0.05cm} Y} \hspace{0.1cm} P_{\hspace{0.03cm}Y \vert \hspace{0.01cm} X}(y\hspace{0.05cm} \vert \hspace{0.05cm}x) \cdot {\rm log}_2 \hspace{0.1cm}P_{\hspace{0.01cm}Y \vert \hspace{0.01cm} X}(y\hspace{0.05cm}\vert\hspace{0.05cm} x) \hspace{0.05cm}.$$

Any  $x ∈ X$  can be used for this equation.

This definition will now be clarified by an example.

Strongly symmetrical channel  $\vert X \vert = \vert Y \vert= 3$

$\text{Example 4}$:  In the channel under consideration, there are connections between  $\vert X \vert = 3$  inputs and all  $\vert Y \vert = 3$  outputs:

• A red connection stands for  $P_{Y \hspace{0.03cm}\vert\hspace{0.01cm} X}(y_κ \hspace{0.05cm} \vert \hspace{0.05cm} x_μ) = 0.7$.
• A blue connection stands for  $P_{Y \hspace{0.03cm}\vert\hspace{0.01cm} X}(y_κ \hspace{0.05cm}\vert \hspace{0.05cm} x_μ) = 0.2$.
• A green connection stands for  $P_{Y \hspace{0.03cm}\vert\hspace{0.01cm} X}(y_κ \hspace{0.05cm}\vert\hspace{0.05cm} x_μ) = 0.1$.

According to the above equation, the following then applies to the channel capacity:

$$C = {\rm log}_2 \hspace{0.1cm} (3) + 0.7 \cdot {\rm log}_2 \hspace{0.1cm} (0.7) + 0.2 \cdot {\rm log}_2 \hspace{0.1cm} (0.2) + 0.1 \cdot {\rm log}_2 \hspace{0.1cm} (0.1) = 0.4282 \,\,{\rm bit} \hspace{0.05cm}.$$

Notes:

• The addition of „the same set of transition probabilities” does not mean that $P_{Y \hspace{0.03cm}\vert\hspace{0.01cm} X}(y_κ \hspace{0.05cm}\vert\hspace{0.05cm} x_1) = P_{Y \hspace{0.03cm}\vert\hspace{0.01cm} X}(y_κ \hspace{0.05cm}\vert\hspace{0.05cm} x_2) = P_{Y \hspace{0.03cm}\vert\hspace{0.01cm} X}(y_κ \hspace{0.05cm}\vert\hspace{0.05cm} x_3)$ gelten muss.
• Rather, here a red, a blue and a green arrow leaves from each input and a red, a blue and a green arrow arrives at each output.
• The respective sequences permute:   R – G – B,     B – R – G,     G – B – R.

An example of a strictly symmetrical channel is the  Binary Symmetric Channel  $\rm (BSC)$.  In contrast, the  Binary Erasure Channel  $\rm (BEC)$  is not strictly symmetric,

• because, although it is uniformly dispersive,
• but it is not uniformly focussing.

The following definition is less restrictive than the previous one of a strictly symmetric channel.

$\text{Definition:}$  A  'symmetric channel exists,

• if it can be divided into several  $($generally $L)$  strongly symmetrical sub-channels,
• by splitting the output alphabet  $Y$  into  $L$  subsetsn  $Y_1$, ... , $Y_L$ .

Such a symmetrical channel has the following capacity:

$$C = \sum_{l \hspace{0.05cm}=\hspace{0.05cm} 1}^{L} \hspace{0.1cm} p_{\hspace{0.03cm}l} \cdot C_{\hspace{0.03cm}l} \hspace{0.05cm}.$$

The following designations are used here:

• $p_{\hspace{0.03cm}l}$ indicates the probability that the  dass der  $l$–th partial channel is selected,
• $C_{\hspace{0.03cm}l}$  is the channel capacity of this  $l$–th partial channel.

Symmetrical channel consisting of two
strongly symmetrical subchannels  $\rm A$  and  $\rm B$

The diagram illustrates this definition for  $L = 2$, where the subchannels are labelled  $\rm A$  and  $\rm B$ .

• The differently drawn transitions (dashed or dotted) show that the two partial channels can be different,  so that  $C_{\rm A} ≠ C_{\rm B}$  will generally apply.
• For the capacity of the total channel one thus obtains in general:
$$C = p_{\rm A} \cdot C_{\rm A} + p_{\rm B} \cdot C_{\rm B} \hspace{0.05cm}.$$
• No statement is made here about the structure of the two partial channels.

The following example will show that the  Binary Erasure Channel  $\rm (BEC)$  can also be described in principle by this diagram.   However, the two output symbols  $y_3$  and  $y_4$  must then be combined into a single symbol.

$\rm (BEC)$  in two different representations

$\text{Example 5}$:  The left graph shows the usual representation of the  Binary Erasure Channel  $\rm (BEC)$  with input  $X = \{0,\ 1\}$  and output  $Y = \{0,\ 1,\ \text{E} \}$.

If one divides this according to the right graphic into

• an ideal channel  $(y = x)$  for
$$y ∈ Y_{\rm A} = \{0, 1\} \ \ ⇒ \ \ C_{\rm A} = 1 \ \rm bit/use,$$
• a cancellation channel for
$$y ∈ Y_{\rm B} = \{\rm E \} \ \ ⇒ \ \ C_{\rm B} = 0,$$

then with the partial channel weights  $p_{\rm A} = 1 – λ$  and  $p_{\rm B} = λ$  for the channel capacity, we get:

$$C_{\rm BEC} = p_{\rm A} \cdot C_{\rm A} = 1 - \lambda \hspace{0.05cm}.$$

Both channels are strongly symmetrical.   The following applies equally for the (ideal) channel  $\rm A$

• for  $X = 0$  and  $X = 1$:     $\text{Pr}(Y = 0 \hspace{0.05cm}\vert \hspace{0.05cm} X) = \text{Pr}(Y = 1 \hspace{0.05cm} \vert\hspace{0.05cm} X) = 1 - λ$   ⇒   uniformly dispersive,
• for  $Y = 0$  and   $Y = 1$:     $\text{Pr}(Y \hspace{0.05cm} \vert \hspace{0.05cm} X= 0) = Pr(Y \hspace{0.05cm}\vert\hspace{0.05cm} X = 1) = 1 - λ$   ⇒   uniformly focussing.

The same applies to the erasure channel  $\rm B$.

In  task 3.12  it will be shown that the capacity of the  Binary Symmetric Error & Erasure Channel  $\rm (BSEC)$  channel model can be calculated in the same way.  One obtains:

$$C_{\rm BSEC} = (1- \lambda) \cdot \left [ 1 - H_{\rm bin}(\frac{\varepsilon}{1- \lambda}) \right ]$$
• with the crossover probability  $ε$
• and the erasure probability  $λ$.

## Some basics of channel coding

In order to interpret the channel coding theorem correctly, some basics of  channel coding  This extremely important area of communications engineering is covered in our learning tutorial  $\rm LNTwww$  in a separate book called  Channel Coding  behandelt.

Model for binary–coded information transmission

The following description refers to the highly simplified model for  binary block codes:

• The infinitely long source symbol sequence  $\underline{u}$  (not shown here)  is divided into blocks of  $k$ bits each.  We denote the information block with consecutive numbering  $j$  by  $\underline{u}_j^{(k)}$.
• Each information block  $\underline{u}_j^{(k)}$  is converted into a code word  $\underline{x}_j^{(n)}$  by the channel encoder with a yellow background, where  $n > k$  is to apply.  The ratio  $R = k/n$  is called the  code rate.
• The  Discrete Memoryless Channel  $\rm (DMC)$  is taken into account by transition probabilities  $P_{Y\hspace{0.03cm}|\hspace{0.03cm}X}(⋅)$ .  This block with a green background causes errors at the bit level. The following can therefore apply:   $y_{j, \hspace{0.03cm}i} ≠ x_{j,\hspace{0.03cm} i}$.
• Thus the receive blocks  $\underline{y}_j^{(n)}$  consisting of   $n$  bits an also differ from the code words  $\underline{x}_j^{(n)}$ .  Likewise, the following generally applies to the blocks after the decoder:  $\underline{v}_j^{(k)} ≠ \underline{u}_j^{(k)}$.

$\text{Example 6}$:  The diagram is intended to illustrate the nomenclature used here using the example of  $k = 3$  and  $n = 4$  .  The first eight blocks of the information sequence  $\underline{u}$  and the  code sequence $\underline{x}$ are shown.

Bit designation of information block and code word

One can see the following assignment between the blocked and the unblocked description:

• Bit 3 of the 1st info block   ⇒   $u_{1,\hspace{0.08cm} 3}$  corresponds to the symbol  $u_3$  in unblocked representation.
• Bit 1 of the 2nd info block   ⇒   $u_{2, \hspace{0.08cm}1}$  corresponds to the symbol  $u_4$  in unblocked representation.
• Bit 2 of the 6th info block   ⇒   $u_{6, \hspace{0.08cm}2}$  corresponds to the symbol  $u_{17}$  in unblocked representation.
• Bit 4 of the 1st info block   ⇒   $x_{1, \hspace{0.08cm}4}$  corresponds to the symbol  $x_4$  in unblocked representation.
• Bit 1 of the 2nd info block   ⇒   $x_{2, \hspace{0.08cm}1}$  corresponds to the symbol  $x_5$  in unblocked representation.
• Bit 2 of the 6th info block   ⇒   $x_{6, \hspace{0.08cm}2}$  corresponds to the symbol  $x_{22}$  in unblocked representation.

## Relationship between block errors and bit errors

To interpret the channel coding theorem, we still need various definitions for „error probabilities”.  Various descriptive variables can be derived from the above system model:

$\text{Definitions:}$

• In the present channel model, the  $\rm {channel error probability}$  is given by
$${\rm Pr(channel error)} = {\rm Pr} \left ({y}_{j,\hspace{0.05cm} i} \ne {x}_{j,\hspace{0.05cm} i} \right )\hspace{0.05cm}.$$
For example, in the BSC model  $\text{Pr(channel error)} = ε$  für alle  $j = 1, 2$, ...  and  $1 ≤ i ≤ n$.
• The  $\rm {block error probability}$  refers to the allocated information blocks at the coder input   ⇒   $\underline{u}_j^{(k)}$  and at the decoder output   ⇒   $\underline{v}_j^{(k)}$,
each in blocks of  $k$  bits:
$${\rm Pr(block error)} = {\rm Pr} \left (\underline{\upsilon}_j^{(k)} \ne \underline{u}_j^{(k)} \right )\hspace{0.05cm}.$$
• The  $\rm {bit error probability}$  also refers to the input and the output of the coding system under consideration, but at the bit level:
$${\rm Pr(bit error)} = {\rm Pr} \left ({\upsilon}_{j,\hspace{0.05cm} i} \ne {u}_{j,\hspace{0.05cm} i} \right )\hspace{0.05cm}.$$
For simplicity, it is assumed here that all  $k$  bits  $u_{j,\hspace{0.08cm}i}$  of the information block  $j$  are corrupted with equal probability  $(1 ≤ i ≤ k)$. Otherwise, the  $k$  bits would have to be averaged.

There is a general relationship between the block error probability and the bit error probability:

$$\frac{1}{k} \cdot {\rm Pr(block error)} \le {\rm Pr(bit error)} \le {\rm Pr(blockerror)} \hspace{0.05cm}.$$
• The lower bound results when all bits are wrong in all faulty blocks.
• If there is exactly only one bit error in each faulty block, then the bit error probability   ⇒   ${\rm Pr(bit errorr)}$  is identical to the block error probability   ⇒   ${\rm Pr(block error)}$.

For the definition of different error probabilities

$\text{Example 7:}$  The graph above shows the first eight receive blocks  $\underline{y}_j^{(n)}$  mit jeweils  $n = 4$ Bit.  Channel errors are shaded green.

Below, the initial sequence  $\underline{v}$  is sketched, divided into blocks  $\underline{v}_j^{(k)}$  with  $k = 3$  bits each:

• Bit errors are shaded red in the lower diagram.
• Block errors can be recognised by the blue frame.

For this, some (due to the short sequence) only very vague information about the error probabilities:

• Half of the receive bits are shaded green. From this follows:
$${\rm Pr(channel error)} = 16/32 = 1/2.$$
• The bit error probability with the exemplary coding & decoding is:
$${\rm Pr(bit error)} = 8/24 = 1/3.$$
• In contrast, with uncoded transmission would be:
$${\rm Pr(bit error)} = {\rm Pr(Kanalfehler)} = 1/2.$$
• Half of the decoded blocks are outlined in blue. From this follows:
$${\rm Pr(block error)} = 4/8 = 1/2.$$

With  ${\rm Pr(block error)}= 1/2$  and  $k = 3$  the bit error probability is in the following range:

$$1/6 \le {\rm Pr(bit error)} \le 1/2 \hspace{0.05cm}.$$
• The upper bound with respect to bit errors is obtained when all bits in each of the four corrupted blocks are wrong:   ${\rm Pr(Bitfehler)} = 12/24 = 1/2.$
• The lower bound indicates that only one bit is wrong in each of the four corrupted blocks:   ${\rm Pr(bit error)} = 4/24 = 1/6$.

## Rate, channel capacity and bit error probability

Basically:

• Channel coding increases the reliability of data transmission from the source to the sink.
• If the code rate   $R = k/n$  is reduced and the added redundancy  $(1 - R)$is increased, the data reliability is generally improved and the bit error probability is reduced, which we will refer to as  $p_{\rm B}$  in the following:
$$p_{\rm B} = {\rm Pr(bit error)} = {\rm Pr} \left ({\upsilon}_{j,\hspace{0.05cm} i} \ne {u}_{j,\hspace{0.05cm} i} \right )\hspace{0.05cm}.$$

The following theorem is based on the  Data Processing Theorem  and  Fano's Lemma.  The derivation can be found in standard works on information theory, for example in  [CT06][2]:

$\text{Inversion of Shannon's Channel Coding Theorem:}$

If one uses a channel with too small a capacity  $R$  for data transmission at rate  $C < R$, the bit error probability  $p_{\rm B}$  cannot fall below a lower bound even with the best possible channel coding:

$$p_{\rm B} \ge H_{\rm bin}^{-1} \cdot \left ( 1 - {C}/{R}\right ) > 0\hspace{0.05cm}.$$

Here  $H_{\rm bin}(⋅)$  denotes the  binary entropy function.

Since the probability of the block errors can never be smaller than that of the bit errors,  the block error probability „zero” is also not possible for  $R > C$ .
From the given bounds for the bit errors,

$$\frac {1}{k} \cdot {\rm Pr}({\rm block error}) \le {\rm Pr}({\rm bit error}) \le {\rm Pr}({\rm block error})\hspace{0.05cm},$$

a range for the block error probability can also be given:

$${\rm Pr}({\rm bit error}) \le {\rm Pr}({\rm block error}) \le k \cdot {\rm Pr}({\rm bit error})\hspace{0.05cm}.$$

$\text{Example 8:}$  For a channel with capacity  $C = 1/3$  (bit), error-free data transmission   $(p_{\rm B} = 0)$  with code rate  $R < 1/3$  is possible in principle.

• However, from the channel coding theorem the special  $(k$,  $n)$–block code is not known which makes this desired result possible.   Shannon also makes no statements on this.
• All that is known is that such a best possible code works blocks of infinite length.  For a given code rate  $R = k/n$  both  $k → ∞$  and  $n → ∞$ thus apply.
• Therefore, the statement  The bit error probability is zero”  is not the same as  „No bit errors occur”:   Even with a finite number of bit errors and  $k → ∞$ ,   $p_{\rm B} = 0$ is true..

With the code rate  $R = 1 > C$  (uncoded transmission) one obtains:

$$p_{\rm B} \ge H_{\rm bin}^{-1} \cdot \left ( 1 - \frac{1/3}{1}\right ) = H_{\rm bin}^{-1}(2/3) \approx 0.174 > 0\hspace{0.05cm}.$$

With the code rate  $R = 1/2 > C$ , the bit error probability is smaller  but also different from zero:

$$p_{\rm B} \ge H_{\rm bin}^{-1} \cdot \left ( 1 - \frac{1/3}{1/2}\right ) = H_{\rm bin}^{-1}(1/3) \approx 0.062 > 0\hspace{0.05cm}.$$